Search Results: "ana"

18 September 2026

Louis-Philippe V ronneau: Fake Cash: The World Trade Game

This is a new series1 I'm starting on the tools I have been crafting and buying to play pedagogical games in my Economics classes. These games, aside from being just plain fun for the students, often aim to teach them a lesson via interactive play. Unsurprisingly, it is much easier for them to grok a particular concept this way. Moreover, many students told me these activities were the best part of the classes I teach. The World Trade Game I found out about The World Trade Game in The Handbook of Pluralist Economics Education2, which also contains many other fun pedagogical games. It was first developed by Action Aid, but has since been refined by John Sloman and then by Irene van Staveren, who wrote about her use of the game in the aforementioned book. The goal of this blog entry is not to describe the game and teach you how to play it. If that interests you, either buy the book I mentioned or read about Sloman's version here. No, our focus point here is the tools to play this game: fake cash! Fake cash can be used in many economics pedagogical games and in my opinion, is a worthwhile "investment" of your time and energy. You could indeed play with regular printed sheets of paper listing a value (I sure did!), but using Play Money (a more appropriate term, since we're not trying to defraud anyone) will up your game and create a more immersive atmosphere in your classes. At first, I tried to buy play money. Surely, some commercial offering aiming to create realistic props for movies and TV productions existed? At least in Canada, it turns out the answer was no. The only thing I could find were shady websites and weird expensive listings on AliExpress. Not being tenured yet, I did not try to convince my employer to take a 50-50 chance on supporting criminal endeavours. As such, the next best thing I found was printable play money designed by the Bank of Canada Museum. Their designs were quite nice and met my needs, but their PDF layout made it overly complicated to print large quantities of bills. As such, I played around with GIMP a little and came out with these files. A commercial printer shouldn't have issues printing them on glossy cardstock paper and cutting them up for you: Once printed and cut, you'll unfortunately have to fold each bill by hand. To secure both halves, I ended up using a strip of transparent tape on each long edge. Here is the result, with a real Canadian 20$ bill as a comparison: Stacks of play money bills, with examples of the 5$, 10$, 20$, 50$ and 100$ bills A real Canadian 20$ bill, side-to-side with the play money version

  1. Don't hold your breath though, as I do not currently have a release schedule.
  2. Reardon, J. (2009). The Handbook of Pluralist Economic Education. New York : Routledge.

15 September 2026

Reproducible Builds: Supporter spotlight: Jochen Sprickerhof on ... Reproducible Builds!

The Reproducible Builds project relies on several projects, supporters and sponsors for financial support, but they are also valued as ambassadors who spread the word about our project and the work that we do. This is the ninth installment in a series featuring the projects, companies and individuals who support the Reproducible Builds project. We started this series by featuring the Civil Infrastructure Platform project, and followed this up with a post about the Ford Foundation as well as recent ones about ARDC, the Google Open Source Security Team (GOSST), Bootstrappable Builds, the F-Droid project, David A. Wheeler, Simon Butler and Kees Cook. Today, however, we will be talking with Jochen Sprickerhof, one of the newer members of the Reproducible Builds project core team.

Vagrant Cascadian: Could you tell me a bit about yourself? What sort of things do you work on? Jochen Sprickerhof: I am a freelance programmer working on Open Source. Mainly doing Debian, F-Droid and some smaller software projects. In general I made it a habit to look into every software I use and try to fix bugs or add features I need. In Debian, I maintain about 180 packages with topics covering home banking, build systems and robotics. Most of my time, I currently work on reproduce.debian.net, where we try to bit-for-bit reproduce the packages distributed by Debian.
Vagrant: Could you describe the path that lead you to working on reproducible builds? Jochen: I started my Debian journey as a teenager, converting my school to Debian and serving as its system administrator for 13 years. After studying Applied System Science, I joined the university s robotics labs, where I worked on the Robot Operating System (ROS) and the Point Cloud Library (PCL). In the end, I enjoyed programming more than writing papers, so I eventually left academia for a robotics startup. Some years ago, I realized that the open source work I was doing in my spare time was actually the work I cared most about. Nowadays I am really grateful that I can spend my days working on things I find important and have lots of fun with.
Vagrant: What projects did you recently make big progress on? Jochen: A recent example is metasnap.debian.net. It is a meta archive of snapshot.debian.org which is itself archive of all packages in Debian. But let me explain it the other way round: with reproduce.debian.net, we try to reproduce the packages as they are distributed by the Debian archive. For that, we need the same build environment (compilers, libraries, build tools, etc) that was used by Debian back when the original package was compiled. Luckily, snapshot.debian.org has all those packages, but they are not easily accessible via apt, Debian s package manager. So, metasnap provides a mapping from a package name and version pair to the APT repo on snapshot.debian.org needed to download it from. It was created by josch some time ago, and it s awesome work. But when we tried to reproduce more and more packages on reproduce.debian.net, we found that some were missing packages from the build environment even though they where visible on snapshot.debian.org. We found that metasnap excluded some archive areas because they where not expected to be needed. Reimporting all the data took more than two months and surfaced a couple more flaws. With this fixed, we were able to build more packages, only to find out that metasnap also needs better support for version numbers. Luckily we were able to rewrite the data in a day instead of starting the import again.
Vagrant: You have been working on infrastructure to support reproducible builds for a while. Has recent adoption of reproduce.debian.net into the Debian release tooling changed the focus of your work? Jochen: Quite a bit. When we started reproduce.debian.net in 2024, only around 33% of the packages could be reproduced successfully. Today we are above 98%. Most were not bugs in the packages themselves but in the infrastructure. Similar to the metasnap issue I reference above, packages just needed a rebuild because something else, like the toolchain, was fixed in the meantime. In May, people from the Debian release team and the Reproducible Builds project sat together and decided that the overall state is good enough, and now packages that regress on reproducibility are blocked from entering the next Debian release. But that does not mean all the work is on the shoulders of Debian package maintainers. Since then I have been constantly looking at the migration tooling to spot regressions and provide fixes. Furthermore, a couple of maintainers reached out to us for help and I hope more will do so in future.
Vagrant: What is one small thing you (or others) have not yet gotten to that you would really like to see? Jochen: The central tool to reproduce Debian packages is debrebuild, also written by josch. Currently it has two ways to retrieve the build dependencies of a package. Either it uses metasnap.debian.net (as explained above), or it can access the Debian unstable APT repository directly. This allows to test packages locally before everything is indexed on metasnap by compiling against Debian unstable. But actually there are many other APT repositories to query, like Debian stable or even derivatives. Adding support for an optional list of APT repositories in debrebuild would be great. That would also be a big step to support reproducing other Debian based distributions.
Vagrant: and one big thing? Jochen: It would be great to integrate metasnap.debian.net into snapshot.debian.org. There is some discussion on it already in Debian bug #650783.
Vagrant: What are the tools you use the most? Jochen: According to my fish shell history:
$ history   cut -d' ' -f1   sort   uniq -c   sort -nr   head -10
  36199 git
  20941 vi
  12271 rm
   8599 cd
   7917 ls
   6407 apt
   5631 grep
   4249 mv
   3655 dpkg
   2873 cp

Vagrant: So, is the fish shell reproducible? I remember it did not used to be Jochen: You can check for yourself it was last time I checked. But looking through the other commands, neovim sadly is not. I hope we can fix that in future.
Vagrant: Oh, that s a nice URL to check for reproducible package you can just pass the source package name to check the current results? Jochen: Yes. Another one is udd.debian.org/reproducibility/, where you can list all packages of a Debian maintainer. It also lists source reproducibility and has nice filters as well.
Vagrant: What tools do you use specifically working on reproducible builds? Jochen: I don t have statistics for that, but I would say sbuild to build the package, debrebuild to reproduce it, and diffoscope to analyze the differences. Obviously I also need run apt source <package> or use git-buildpackage to get the sources and all the tools I mentioned above.
Vagrant: So how many packages are left to build reproducibly, and once those are finished, what is next? Jochen: Right now, reproduce.debian.net shows over 98% reproducibility, though there are still over 650 package left and some will probably need a lot of work. But actually I think making packages reproducible is just the first step. For me, this is a project to build confidence in the system. To reproduce a package we have two parts: the source of the package and the build environment. Fixing the packages means gaining confidence in the first part but we still rely on the individual build environments for each package as we need to use the same compiler that was used when the package was build initially. Because of this, we have to keep around every historical version of all toolchain packages. I really would like to remove this extra archive, which means we would have to rebuild all of Debian around release time. I am dreaming of a Debian release where you could bit-for-bit reproduce every package just from the released versions. Due to how Debian works, however, this is not a trivial rebuild and it would need some work on the infrastructure. By the way, initially there was a third component to pay attention to: any connection to the outside world during the build. Luckily we fixed the Debian build daemons to not allow network connections during the build some time ago.
Vagrant: Thanks for all that work, and taking the time to tell us a bit about yourself! Jochen: Thanks a lot for the interview!


For more information about the Reproducible Builds project, please see our website at reproducible-builds.org. If you are interested in ensuring the ongoing security of the software that underpins our civilisation and wish to sponsor the Reproducible Builds project, please reach out to the project by emailing contact@reproducible-builds.org.

Freexian Collaborators: Debian Contributions: Security-tracker git performance, OpenSSH GSS-API split, Incus replacing lxc in Debian CI and more! (by Anupa Ann Joseph)

Debian Contributions: 2026-08 Contributing to Debian is part of Freexian s mission. This article covers the latest achievements of Freexian and their collaborators. All of this is made possible by organizations subscribing to our Long Term Support contracts and consulting services.

Replacing lxc with Incus for Debian CI, by Antonio Terceiro At the beginning of this month, the default backend for tests was changed to incus-lxc, leaving only a few dozen packages explicitly configured to run as lxc. Those packages got bug reports filed and once those bugs are fixed they will be migrated over to incus-lxc. This marks an important milestone for Debian CI, as the low level of isolation between the worker host OS and the OS under test when using lxc was a significant source of instability in our platform. Common causes for test failures when comparing runs under plain lxc with runs with incus-lxc are documented in the wiki page linked from the bug reports.

security-tracker git performance, by Helmut Grohne Developers working with Debian s security-tracker have reported degrading performance for a while. The options for solving this are few with repository sizes now reaching 30GB for a repository whose working tree is a mere 60MB. While there have been a number of proposals for changing the storage layout, Helmut evaluated options not requiring such changes. Much of the problem hinges on the 50MB data/CVE/list file that is updated in most commits. Efficiency hinges on representing its content in git packs. Practically, git frequently fails to represent its content as a delta and stores a full copy that is typically compressed to 12MB. Add a few thousand 12MB full blobs and you quickly have a large repository. In particular, the copy at salsa.debian.org stores many such full blobs, so pulling from it consumes significant bandwidth. One might think that running git gc helps, but its utility is limited here. When git stores objects in packs, it stores the history in reverse. It starts with the current version and represents older objects as differences (deltas) to more recent objects. A delta effectively is a sequence of copying ranges from a base object and insertion of new content. Given that humans tend to add content over time, those additions are often represented as deletions. The crux here is finding that base object. Given that the data/CVE/list file is large, finding it involves comparing quite a few versions of it with each other. This requires both a significant amount of RAM and CPU time. How many objects git considers for this comparison is controlled with the --window option. It is beneficial if the base object does not come from a direct child commit but skips over commits. In doing so, long chains of deltas are avoided. The --depth option controls the maximum chain length. In this search, git combines all objects into a single window to facilitate file renames. As such, it tends to compare data/CVE/list with data/DSA/list, data/DLA/list and others. This is less than helpful and tends to evict all data/CVE/list versions from the comparison window such that a new full blob of it becomes required. Since the security-tracker repository rarely renames files, we can ask git to instead consider one window per filename via --path-walk. Once doing so, it becomes quite a bit better at finding suitable deltas. The technique is less applicable to older history (2025 and earlier), but given a lot of RAM and a bit of partitioning, git gc can shrink that as well. Combining these techniques, we can shrink the repository into 700MB and keep new growth somewhat under control. Temporarily, Helmut is providing a proof-of-concept mirror at git://git.subdivi.de/~helmut/security-tracker.git using these techniques. Avoid pulling from it directly as it does not provide a secure transport. While it does reduce the amount of data being downloaded, it does not resolve a number of related problems. After downloading, a git client will still expend considerable amounts of CPU on verifying received deltas and attempting to git blame data/CVE/list is not improved in any way. Still, there is work on integrating some of the improvements back into salsa.

OpenSSH GSS-API split, by Colin Watson In an option review Colin did in 2024, shortly after the xz-utils backdoor, he explained that having GSS-API authentication and key exchange support in the main OpenSSH packages is problematic. The key exchange patch is large and intrusive. Even linking to the necessary libraries isn t without risk: as the Ebury malware attack demonstrated way back in 2009, each extra library linked into security-critical daemons such as sshd (or nowadays into its privilege-separated helper programs) can modify the behaviour of the daemon even if you aren t doing anything that would involve calling into that library. Of course some of that risk remains, but as Damien Miller wrote, minimizing the number of libraries that end up in the address space of sshd and friends is still valuable. This split is now complete in testing. As of openssh 1:10.4p1-5, the OpenSSH client and server are built without GSS-API authentication and key exchange support. If you need those features, install openssh-client-gssapi or openssh-server-gssapi instead, as appropriate. Debian 13 (trixie) already has packages with those names that just depend on the regular openssh-client and openssh-server so that you can pre-emptively install them, as documented in the release notes. The new openssh-*-gssapi packages have relatively tight dependencies on openssh-common, in order for the testing migration system to ensure that we can t forget to keep them up to date. This will mean a bit more ongoing work on each new upstream version, but it should be manageable.

Catching up on DebConf video publication, by Stefano Rivera DebConf 25 videos suffered terribly from a bug in voctomix that stopped us from being able to publish the videos immediately after the conference. Ivo De Decker did some work on the videos earlier this year, fixing enough of the audio problems to make the videos at least intelligible. While at MiniDebConf Winterthur Stefano published all the videos from 2025 and 2026 to PeerTube and YouTube. DebConf 25 and DebConf 26 videos as well as all the videos from miniconfs that had got caught up in the backlog were published.

Miscellaneous contributions
  • Carles used po-debconf-manager to review and submit Catalan translations for six packages.
  • Carles prepared a prototype of building webwml and running tidy (linter) in Salsa.
  • Carles created different webwml merge requests with different fixes: invalid links to different architectures, 404s to external sites, fixed templates with invalid URL to favicon.ico, making USE_SAMPLE_FILES=1 to avoid fetching external files, typos in English, etc.
  • Carles updated the LibreOffice Wiki page.
  • Emilio managed several transitions, such as glibc 2.43, perl 5.42, kdepim, nginx, gnome-desktop 51, python3.14-only, and many others.
  • Emilio updated libxfont to 2.0.9, xorg-server to 21.1.24, xwayland to 24.1.13, and fixed a FTBFS bug in terminator.
  • Antonio deployed the website for MiniDebConf Beijing 2026, and archived the Hamburg 2026 and Kanpur 2026 MiniDebConf websites.
  • Antonio released auto-apt-proxy 18, adding new features and fixing bugs; that needed a followup 18.1 release to fix an issue identified in the testing migration tests.
  • Antonio did several Salsa maintenance tasks, including his first platform security update and investigating an issue that was causing the background tasks to be severely delayed, imparting the site usability.
  • Thorsten tried to fix some bugs in hplip and cups. Unfortunately this did not result in an upload this month, but stay tuned!
  • Helmut continued to report undeclared file conflicts and correspond about them.
  • Helmut reviewed and merged Johannes Schauer Marin Rodrigues work on adding hurd support to debvm.
  • Helmut fixed a pile of minor issues in the support libraries underpinning unschroot.
  • Helmut adapted rebootstrap to archive regressions and improved its handling of non-default gcc versions.
  • Helmut fixed the rendering of decompressed logs at crossqa.debian.net.
  • Helmut sent patches for two cross build failures.
  • Colin deployed the fix for Invalid link rel= canonical on bugs.debian.org. In the process he found a few bugs in recent undeployed code and fixed them.
  • Santiago continued helping Aryan Karamtoth with the GSoC project on introducing livepatching support for linux. Several challenges have been identified in the recent couple of months, and Santiago is trying to guide Aryan to address them and design the solution. The mentoring is done in collaboration with Emmanuel Arias.
  • Lucas onboarded a co-maintainer for Valkey.
  • Lucas has started to work on a draft for the Debian Outreach project for onboarding newcomers interested in Debian packaging via a video course.
  • Stefano worked on the after-math of DebConf 26, handling the bursary expense reimbursement process and winding down the conference finances.
  • Stefano uploaded Python 3.15 RC 1 to Debian unstable.
  • Stefano did some budgeting and travel planning for the DebConf 27 site-visit in Asahikawa, Japan. The DebConf committee sends a couple of members to meet with the local team and view the venue together, in advance of the next DebConf.

11 September 2026

Reproducible Builds: Reproducible Builds in August 2026

Welcome to the August 2026 report from the Reproducible Builds project! In our reports, we try to outline the most important things that we have been up to over the past month. As a quick recap about what problem our project intends to solve, whilst anyone may inspect the source code of free software for malicious flaws, almost all software is distributed to end users as pre-compiled binaries. The motivation behind the reproducible builds effort is to ensure no flaws have been introduced during this compilation process by promising identical results are always generated from a given source, thus allowing multiple third-parties to come to a consensus on whether a build was compromised or not. In this month s report, we cover:

  1. New updated SBOM specification from CISA.gov
  2. LWN on Bootstrappable builds at FOSSY 2026
  3. What s missing to have reproducible builds on PyPI?
  4. Distribution work
  5. Unreproducible builds under EROFS filesystem fixed
  6. Tool and documentation development
  7. Six new scholarly papers
  8. Patches

New updated SBOM specification from CISA.gov CISA, the Cybersecurity and Infrastructure Security Agency of the U.S. government published some the joint guidance entitled Minimum Elements for a Software Bill of Materials (SBOM), which updates and supersedes the baseline 2021 version covered in previous editions of these reports. Whilst the PDF is worth skimming, the interesting changes include that the specification now mandates standard cryptographic hashes: unlike earlier standards that allowed hash omission or manifest-only parsing, hashes must be computed from the output. This is is important for reproducible builds, as it ensures the recording of the metadata required to demonstrate the shipped software matches the build output precisely where applicable. In addition, where the top-level only dependency limitation that was present in the 2021 version has been removed in favour of complete coverage with no minimum depth. That is, SBOMs are expected to reflect all linked libraries, vendored dependencies and other build-time inclusions.

LWN on Bootstrappable builds at FOSSY 2026 In the Toolchains and Other Development Tools track at Software Freedom Conservancy s FOSSY 2026 in British Columbia, Canada, Timothy Sample gave a presentation on bootstrappable builds. This presentation was then covered in a Linux Weekly News article by Jake Edge entitled Bootstrappable builds: how and why, which serves as an excellent introduction to the concept:
The basic idea behind bootstrappable builds is to create a system that can be built without relying on pre-built artifacts. Can we go from zero to the modern day without having to just assume the existence of these already-built-for-us artifacts? The classic recipe for yogurt requires some yogurt to start the process, which is like how we normally build a C compiler today we start with an existing C compiler binary. You might think about making sourdough bread with your grandmother s starter brought over from the old country; we re basically making C compilers with Dennis Ritchie s starter carried over from Bell Labs .
The article, which goes on to cover GNU Mes and other projects that overlap with Reproducible Builds, also has a number of thought-provoking comments.

What s missing to have reproducible builds on PyPI? Core Python developer, Brett Cannon wrote an interesting blog post this month addressing What s missing to have reproducible builds on PyPI, the official public repository for third-party Python software packages:
The reason I like the idea of making reproducible builds work is that I think it can be done in such a way as to not require any work on the part of the producer of a distribution (which is a technical term for sdists or wheels, i.e., the people who upload stuff to PyPI), and thus make reproducible builds very low-friction for people to opt into supporting. [ ]
Brett goes on to outline What s missing from the specs and how reproducibility might be visible on PyPI to consumers:
Assuming all of this comes to pass and we record the where the source code is that went into a distribution and the software used to make the distribution, how do we make it useful to people? Does every person who cares about having a secure supply chain have to rebuild everything they use themselves? Is there some way for even people who don t care about this stuff to benefit? [ ]

Distribution work In Debian this month, 23 reviews of Debian packages were added, 28 were updated and 27 were removed this month adding to our knowledge about identified issues. A number of issue types have been updated as well, such as the addition of a new toolchain issue related to python-traitlets [ ], and the note for an existing issue related to texi2html was updated as well [ ]. Lastly, Bernhard M. Wiedemann posted another openSUSE monthly update for their reproducibility work there.

Unreproducible builds under EROFS filesystem fixed Martin Pitt reported on Fosstodon that they had identified an issue where the mkfs ( make filesystem ) command for the EROFS (Enhanced Read-Only File System) subsystem of the Linux kernel did not have sorted extended file attributes, leading to reproducible builds. Thankfully, Martin also reported that they had fixed this in a commit to the kernel which order[s] each inode s xattrs by name so that images stay reproducible . [ ]

Tool and documentation development diffoscope is our in-depth and content-aware diff utility that can locate and diagnose reproducibility issues. This month, Chris Lamb made a number of changes, including preparing and uploading versions 327, 328 and 329 to Debian. In particular, he ensured that diffoscope did not require python3-guestfs in the autopkgtests on 32-bit architectures in order to fix Debian bug (#1144372) [ ]. Colin Watson made an additional change, handling a potentially missing openssh-client package when running the autopkgtests [ ], and Jochen Sprickerhof made a similar change to cope with missing cpio and qemu-img functionality [ ] whilst also updating the XML comparator to be considered when comparing SVG images [ ].
Yet again, there were a number of improvements made to our website this month as well. For example:
  • Chris Lamb added draft for a Gothenburg summit-related news article. [ ][ ]
  • Holger Levsen then published the same article. [ ][ ]
  • Lastly, a large number of commits were pushed comprising an interview with Reproducible Builds developer Jochen Sprickerhof to be published within the next week. [ ][ ][ ][ ][ ][ ][ ]

Six new scholarly papers Jens Dietrich, Spencer Sun, Tim W. White and Behnaz Hassanshahi (the result of a collaboration between Victoria University of Wellington and Oracle Australia published a paper this month entitled No Snake Oil: Verifying Python Package Builds. Drawing on the metaphor of snake oil , that is, a fake or ineffective medicine or solution sold with exaggerated claims of curing or fixing everything, the authors write that
Two tools that are designed to automate [PyPI] rebuilds and run them at scale are macaron and oss-rebuild. We study 12,180 popular releases from PyPI and find that the byte-for-byte equivalence rate is generally low. We analyse the reasons why they produce different wheels, and find that equivalence between the original and rebuilt wheels can often still be established, preserving most of the guarantees users expect from rebuildable releases. We present and evaluate daleq4py, a tool to establish the equivalence of Python wheels through the kernel of a normalisation function that is based on provenance-preserving datalog rules. Experimental results show that daleq4py substantially expands the set of rebuilds that can be accepted as equivalent.
The full PDF of their paper can be viewed online, and Jens Dietrich to our mailing list to announce the availability of both the paper and the daleq4py tool itself.
Dimitri Kokkonis, Micha l Marcozzi and Stefano Zacchiroli published an article this month titled Not In My Git Yard: Catching Backdoors at Commit and Release Time on the topic of code-level backdoors that is, stealthy code changes that grant hidden privileges via secret triggers . These issues:
pose a persistent threat to opensource software. Known attempts to inject such backdoors into widely used projects through malicious commits, tampered release packages, or compromised third-party dependencies, were stopped only by luck and manual review. Existing Continuous Integration (CI) pipelines cannot detect these attacks, and downstream binary analysis tools require substantial manual effort. In this work, we present Lily, an automated approach that strengthens open-source development and release processes against backdoor injection. Lily integrates a backdoor detection mechanism into (1) CI pipelines to block malicious commits, and (2) release vetting workflows to prevent tampered releases or compromised dependencies from entering large ecosystems, such as Linux distributions.
The full PDF can be read online.
Ranindya Paramitha and Laurie Williams of North Carolina State University along with Christian K stner of Carnegie Mellon University published a paper this month with the title of The Software Supply Chain as a Market for Lemons: A Multivocal Review of Trust Signal Collapse. (A lemon in American English, is a vehicle that turns out to have several manufacturing defects .) Their abstract is as follows:
Practitioners evaluating open-source dependencies rely on cheap trust signals, e.g., stars, download counts, and contributor activity, as substitutes for direct code inspection, assuming those signals reflect genuine trustworthiness. Prior work has documented individual signal gaming, but the landscape of collapses across all dependency-adoption signals, as well as the ecosystem s response, remains unexplored. The goal of this study is to aid software practitioners in understanding the reliability of dependency adoption trust signals, such as download counts and contributor activity, by conducting a multivocal review of 252 Google Search sources and 870 Reddit threads.
Worryingly, after their review, the authors conclude that cheap trust signals collapse under three simultaneous forces: adversarial manipulation, gaming techniques indistinguishable from legitimate behavior, and non-adversarial AI-driven inflation. The full PDF of the paper is available online.
Julien Malka, Aman Sharma, Martin Monperrus, Stefano Zacchiroli and Th o Zimmermann published a paper this month on Trusting-Trust Attack against an Entire Linux Distribution through Binary Manipulation:
Ken Thompson s trusting-trust attack, in which a compromised compiler backdoors the programs it builds and reproduces the backdoor in subsequent rebuilds of itself, is widely regarded as a threat specific to compilers. We show that it is not. We construct a complete trusting-trust attack around GNU strip, an ordinary build utility that neither inspects nor generates source code, using only manipulations of finished ELF files.
Scarily, in the authors example, a single tampered strip in the binary seed implants a payload that propagates from one generation of strip to the next and survives into the final standard environment after the seed leaves the dependency closure [ ] without failures and backdoors . A full PDF of the paper is available for download online.
Mehdi Keshanimm, Amirhossein Rahmati, Mohammad Hossein Aref and Abbas Heydarnoori published a paper that is currently under review at Emperical Software Engineering titled AROMA+: A Study of Factors Affecting Reproducible Builds in the Maven Ecosystem. (Maven is a/the build automation tool used for Java projects.) In their paper, the authors note that
[ ] reusing external software in a project presents a security risk when the source of the component is unknown or the consistency of a component cannot be verified. The SolarWinds attack serves as a popular example in which the injection of malicious code into a library affected thousands of customers and caused a loss of billions of dollars. [ ] Our research aims to support [reproducibility] efforts in the Maven ecosystem through automation. We investigate the feasibility of automatically finding the source code of a library from its Maven release and recovering information about the original release environment. Our tool, AROMA+, can obtain this critical information from the artifact and the source repository through several heuristics and we use the results for reproduction attempts of packages on Maven Central.
The full PDF of their article can be downloaded online.
Lastly, Oreofe Solarin, Kelechi Kalu, James C. Davis and Paschal Amusuo published a paper this month titled Reproducibility is Not Enough: Artifact Verifiability in Decentralized-Build Package Ecosystems:
[A]rtifact verification requires more than deterministic builds: a verifier must also recover the source state, build environment, dependencies, and build instructions that produced the artifact. Decentralized-build ecosystems make this difficult because artifacts are produced through heterogeneous tools, maintainer-controlled workflows, and fragmented metadata. As a result, it remains unclear how often artifacts in these ecosystems can be independently verified. This paper studies artifact verifiability across four popular decentralized-build package ecosystems. We define an independent verifier model that relies only on registry-derivable metadata and an artifact comparison model with tiered equivalence levels. We implement these models in an Artifact Verification Pipeline and use it to measure artifact verifiability across the target ecosystems.
The authors conclude that beyond build determinism, verifiability is limited by missing source and build metadata, implicit release transformations, and unconventional build practices . A PDF of their paper can be reviewed online.

Patches The Reproducible Builds project detects, dissects and attempts to fix as many currently-unreproducible packages as possible. We endeavour to send all of our patches upstream where applicable or possible. This month, we wrote a large number of such patches, including:

If you are interested in contributing to the project, please visit our Contribute page on our website.

9 September 2026

Thorsten Alteholz: My Debian Activities in August 2026

Debian LTS/ELTS This was my hundred-forty-sixth month that I did some work for the Debian LTS initiative, started by Raphael Hertzog at Freexian. Unfortunately the number of distributed working hours had been rather low this month, so the list contains much less entries than normal. During my allocated time I uploaded or worked on: Last but not least I spent days with FD work at the beginning of the month. The last remaining hours I continued to work on cups and hplip. Unfortunately this work did not result in an upload yet. Debian Printing This month I did not upload any package but just worked on some bugs. This work is generously funded by Freexian! Debian Lomiri This month I worked on new Lomiri Apps. Due to a broken disk, the progress was not as expected. But stay tuned! Not really related to Lomiri, but to Debian EDU, I fixed an incus related bug in sitesummary. This work is generously funded by Fre(i)e Software GmbH! Debian Astro This month I uploaded a new upstream version or a bugfix version of: Debian IoT Unfortunately I had no time to work in this category this month. Debian Mobcom This month I uploaded a new upstream version or a bugfix version of: misc This month I uploaded a new upstream version or a bugfix version of:

8 September 2026

Paul Tagliamonte: You would never break the chain (Part 10/12)

This post is part of a series called "Pigeon". If this is the first post you've found, it'd be worth reading the intro post first and then looking over all posts in the series.
Now that we have a working Layer 1, we have a way to send a block of bits from one place to anyone who cares to listen to us. This is very welcome news, but we are now facing a new, different and just as fun question what shape should that data take?
Need a bit more of a crash course on what "Layer 1" and "Layer 2" mean? No problem, I wrote up short summary here to help.
Given our incredibly limited functionality of our nodes, we could definitely skip all this work and just stuff an IP packet into the link; but I decided to not since I am (eventually) interested in adding some sort of spanning tree-like protocol to implement network switching so not all nodes need to communicate directly with all other nodes but that day is not today. Given i m going to stub most of that out, let s take a look at what some similar Layer 2 protocols use things like Ethernet or WiFi frames. Both contain structured information regarding the transmitter, desired recipient, type of data, and the higher-level data itself (such as IP packets). As a result of attempting to learn from others, the Pigeon Layer 2 (called, simply, link ) is also split into a fixed-length header, followed by the contents described by the header.
dst mac
src mac
callsign
length
payload
The header is a fixed-length (23 byte) structure, which contains the source MAC address (src mac), destination MAC address (dst mac), the ITU coordinated ham radio callsign of the control operator of this message (callsign), the type of payload to follow (type; defined below), and the length of the data to follow the header (length as a 16 bit big-endian unsigned integer). The type field indicates how the payload is to be interpreted currently I ve only defined 3 possible payload types so far:
Type Description
0x01Raw (testing only)
0x02Cal
0x04Ipv6
Keen observers will perhaps infer that there used to be an Ipv4 type at 0x03 which is true however, i ve since removed it since i ve never once used it and the codepath was more trouble than it was worth. As is my wont, I ve optend to just lean into Ipv6-only IP transport it s easy enough to shim ipv4 in, if someone REALLY wanted to using something like 64:ff9b:1::/48 and a bit of code in the transmitter/receiver (or even using something like jool and unbound s dns64-prefix at the router). I don t think I ll bring it back, but just in case I have to for some reason in the future, it s there. Additionally, friends of the pod may also recognize that this structure is basically the exact same structure as what I had in PACKRAT, which, is also true. I started this project off maintaining interoperability in the Layer 2 for pigeon and packrat, but at some point just gave up on it during one of the many cleanups. I m hopeful I can maintain compatibility going forward, and that won t have to muck with this header too much more. We ll see what happens once I start to push the bounds of what is possible with pigeon. Hopefully it feels like carrying IP data inside this frame to be a pretty self-explanatory exercise the 0th byte of the payload is the 0th byte of an IPv6 header (followed by all the usual stuff, like UDP or TCP header(s) and any carried data, just like you d find anywhere else. Pigeon s calabration protocol

Paul Tagliamonte: wrapping it all up (Part 8/12)

This post is part of a series called "Pigeon". If this is the first post you've found, it'd be worth reading the intro post first and then looking over all posts in the series.

If you're looking for it, the intro to the PHY (layer 1) that this belongs at a high level and listing of the parts that make it up (including this one) is on the phy post.
The time has come. If you re following along at home, we now have all the basics we need to glue these parts together and see what this looks like. We re going to build the highest-level constructs for the PHY in code something that takes some number of bytes in and writes out IQ samples fit for transmit over the airwaves (we ll call this the Encoder), and something that takes chunks of IQ samples in, writing out decoded bytes (which we ll call the Decoder).

Encoder Let s begin with the Encoder, since it s slightly less involved. I ve tried to make this a bit more accessible by drawing a diagram out before describing the order of operations, so that it s possible to follow along visually. While the process here can look like a lot, it s really not that bad. We begin by taking the incoming bytes, converting the bytes into bits, and chunk those bits into parts which are sized to fit completely within an LDPC message. We will then encode incoming data into LDPC messages, using our configured LDPC Matrix (the table we appropriated from 802.3an). Next, we apply whitning over all the bits in our encoded (and packed) LDPC messages, using our configured whitening constant. In the case of QPSK, pairs of bits will then be modulated into a QAM subcarrier, where each QAM point represents a range of bits in the message. We ll go through each of those modulated IQ subcarriers, and set each corresponding data subcarrier in order, for each OFDM symbol contained in the pigeon Burst. The preamble configuration is then used to generate (or, more likely, can be used at startup to precompute) the Schmidl-Cox preamble, which is written to the first IQ samples in our output IQ buffer. Finally, we will do a series of inverse FFT operations to convert each OFDM symbol to the time domain, including their cyclic prefix. Let s take a look at doing that, but in code this time now:
// (lightly edited for clarity)
impl Encoder  
 ..

 /// Encode the provided bits into the output time-domain IQ samples.
 fn encode(
 &mut self,
 dst: &mut [IQ],
 src: &Vector,
 ) -> Result<Burst, Error>  
 let src =  
 let mut raw = Vector::new(self.fec.message_len());

 // Set  raw 's data bits, compute and set LDPC
 // checkbits.
 self.fec.add(&mut raw, src);

 // Apply whitening, and return
 raw.xor(&self.whitening)
  ;

 // copy in the precomputed schmidl-cox preamble to  dst 
 let preamble_len = self.preamble_iq.len();
 dst[..preamble_len].copy_from_slice(&self.preamble_iq);

 // allocate a new (frequency domain) 'Burst' container.
 let mut burst = Burst::new(
 &self.mode.ofdm.plan,
 self.mode.ofdm.symbols
 );

 // modulate bits from 'src' as iq, and set each
 // data subcarrier for each ofdm symbol in the
 // burst.
 self.burst_encoder.multiplex(&mut burst, &src);

 // convert from frequency-domain data into time
 // domain iq samples, writing out ofdm symbols
 // and cyclic prefixes to  dst .
 self.burst_encoder
 .transform(&mut dst[preamble_len..], &burst)?;

 // normalize all IQ samples; the maximum magnitude
 // in the IQ buffer may be very small, which weakens
 // our transmitted signal. Scale all IQ samples such
 // that the maximum IQ sample magnitude will be '1.0'.
 dst.norm();

 Ok(burst)
  
 
Using the Encoder should hopefully be fairly straightforward we ll give it a bag of bytes, and get back some IQ samples that we can ask our nearest SDR to transmit. As for what happens on the other end?

Decoder Next up is the mirror image of our Encoder the, imaginatively named, Decoder. The Decoder is slightly more involved (since it has to find the packet in the IQ stream, as well as correct for channel error(s)), so we ll do the same thing as above start with a diagram. My hope is going over the Encoder first helps us only really focus on the new stuff, otherwise it should feel like running the Encoder backwards. Here, we start with an incoming stream of IQ, where we will process scan detections as they come in from our Schmidl-Cox detector and burst Scanner. This will give us a snippit of IQ, sized to exactly our Burst. We ll begin to correct our IQ samples by first doing frequency estimation and correction in the time domain using our preamble and ofdm configuration. We ll then do a series of inverse FFTs to extract each OFDM symbol in our Burst, where we can then do channel estimation and correction. With the OFDM symbols (hopefully) good enough, we can now map each data subcarrier back to bits, and unapply whitning. The resulting bits are then chunked back up into LDPC messages, which are then checked, and concatanated data extracted. Finally the bits are turned back into bytes, which are written to our output buffer. However, before we get into the code to do this there s one last detail. We know bursts won t overlap (if they do, it s likely not possible to recover right now even though other PHYs can and do), so any time we see something we believe to be a burst, we can skip ahead by the burst s (constant) length within the IQ, and avoid trying to decode anything else in there. The nice side-effect here is this also gives us an interesting property for the Decoder namely, we know the maximum number of Burst detections we can get for a given block of incoming IQ data if they were packed end-to-end and we can pre-allocate the memory we need, avoiding allocations for every demodulation attempt (which may or may not even be a valid Burst). This pre-allocated block of memory to hold the burst s data is something that I ve called a frame buffer internally. Each frame buffer contains exactly sized buffers to hold decoded information from the burst an iq buffer that is exactly the same number of samples required to encode the preamble and data, exactly the number of bits needed to store pre and post FEC data, pre-allocated byte array, etc. Not shockingly, the code looks like this:
#[derive(Clone)]
pub struct FrameBuffer  
 /// Corrected IQ samples
 pub samples: Samples,

 /// post-correction OFDM burst
 pub burst: Burst,

 /// demodulated bits from the OFDM burst
 pub bits: Vector,

 /// demodulated bits from the OFDM burst,
 /// after FEC, and cleaned
 pub raw_bits: Vector,

 /// Layer 2 contents of the Frame
 pub contents: Vec<u8>,
 
Of course, that alone is handy but we need to use them. So let s go ahead and do what we promised above each Decoder uses a fixed number of pre-allocated FrameBuffers to store packets in-flight, packed into what is, creatively, called FrameBuffers within my code. As an aside, I likely should have called this a Memory Pool, since that s the common and accepted name for this design pattern but being stuck with unfortunate names is the burden of those of us who stumble into sensible ideas over time. The only nuance here is that I use the pools strictly sequentially we only save the FrameBuffer if the LDPC checksum is correct, allowing us to only keep track of how many successful packets we have and being able to get the valid FrameBuffers, rather than storing a handle to each FrameBuffer as we go a promise that most memory pools do not make, since blocks can usually be taken and returned in any order. Let s go ahead and do the whole Decoder dance now:
// (lightly edited for clarity)

impl Decoder  
 ..

 /// Process incoming IQ for Pigeon Bursts, and
 /// demodulate them.
 pub fn decode(
 &mut self,
 buf: &[IQ],
 ) -> Result<Vec<(Detection, &FrameBuffer)>, Error>  
 let mut ret = Vec::new();
 let mode = self.scanner.mode().clone();

 // reset the "valid frame buffer count" back to 0
 self.frames.reset();

 // call the scanner and get scan detections for
 // this block of iq ( buf )
 for detection in self.scanner.scan(buf)  
 // for each detection, we're (only) going to process
 // the iq snippit, but pass along the metadata
 // such as SNR.
 let ScanDetection  
 snippit,
 snr,
 range,
 m,
   = detection;

 // grab the next free frame buffer to work within.
 let frame_buffer = self.frames.next_mut();

 // Copy the snippit into the frame buffer (a mutable
 // location)
 frame_buffer.samples.copy_from_slice(snippit);

 // estimate the frequency offset based on the
 // Burst's Schmidl-Cox preamble.
 let preamble_fo = preamble::estimate_frequency_offset(
 &mode.preamble,
 mode.rate,
 &frame_buffer.samples[..mode.preamble.samples()],
 );

 // Shift the IQ stream by the estimated frequency
 // offset -- hopefully we're closer to 0Hz
 frame_buffer.samples.shift(mode.rate, preamble_fo);

 // estimate the frequency offset based on the
 // each burst's **cyclic prefix** -- exactly like
 // we did with the Burst Schmidl-Cox preamble,
 // but this time on each OFDM symbol.
 let ofdm_fo = ofdm::estimate_frequency_offset(
 &mode.ofdm,
 mode.rate,
 &frame_buffer.samples[mode.preamble.samples()..],
 );

 // Shift the IQ stream closer yet; hopefully this
 // is a very small nudge even closer still to 0Hz.
 frame_buffer.samples.shift(mode.rate, ofdm_fo);

 // Do a bunch of inverse fft operations for each
 // OFDM symbol, filling the frequency-domain Symbol
 // structs in  frame_buffer.burst  (Burst) struct.
 //
 // this will also do channel estimation and
 // correction before returning.
 self
 .decoder
 .transform(
 &mut frame_buffer.burst,
 &frame_buffer.samples[mode.preamble.samples()..],
 )?;

 // "demultiplex" each data subcarrier's frequency-domain
 // IQ constellation point, setting the correct bit range.
 self.decoder.demultiplex(
 &mut frame_buffer.raw_bits,
 &frame_buffer.burst
 );

 // unapply whitening by XOR-ing the buffer with
 // the well-known whitening vector.
 frame_buffer.raw_bits = frame_buffer.raw_bits.xor(
 &self.whitening);

 // verify that the LDPC message(s) are all correct,
 // and if so, concatanate the the data bits (no check
 // bits) to the  bits  vector.
 if self.fec.decode(
 &mut frame_buffer.bits,
 &frame_buffer.raw_bits
 ).is_err()  
 // this is where invalid packets fail. we gave it a good go.
 // next packet please.
 continue;
  

 // copy the raw bits out, as bytes, to the  contents  buffer.
 frame_buffer.bits.copy_as_bytes(&mut frame_buffer.contents);

 // store metadata/metrics on the demodulation.
 ret.push(Detection  
 m,
 snr,
 index: range.start,
  );

 // save the contents of this frame buffer (don't
 // reuse this buffer next go-around).
 self.frames.save();
  

 // We're going to take out the borrow on the frame at
 // the end since we don't want to deal with telling the
 // compiler via code gymnastics that the mut and non-mut
 // borrows are OK since they're non-overlapping.
 Ok(ret.into_iter().zip(self.frames.iter()).collect())
  
 
Phew. That was kinda a lot. In fact it s basically the whole thing. This function is as close to how do you read an OFDM packet as it gets, and perhaps the most important part of this whole series. Beyond that, though, this is a huge conceptual unlock. This means we now have an incredibly powerful primitive; the ability to take bytes and go to/from IQ samples over the air. Let s talk about pigeon modes

7 September 2026

Bits from Debian: New Debian Developers and Maintainers (July and August 2026)

The following contributor got their Debian Developer account in the last two months: The following contributors were added as Debian Maintainers in the last two months: Congratulations!

Daniel Lange: Getting AVIF thumbnails in XFCE4 thunar (Debian Trixie)

The AVIF image format gets more and more popular in the web dev community, so I needed to teach XFCE4's thunar (file manager) and Ristretto (image viewer) to thumbnail these. Luckily that is not too hard: Debian Trixie separates its gdk-pixbuf libraries slightly differently than previous versions. That's why it is not "automatically there". Ensure you have the libavif-gdk-pixbuf plugin and the tumbler service (which XFCE uses to process thumbnails):
sudo apt --update install libavif-gdk-pixbuf tumbler
Thunar has likely tried (and failed) to load your AVIF files before you installed the package, it will have saved a blank or "broken image" placeholder in a thumbnail cache directory. It will not attempt to regenerate them unless you clear this cache:
# Clear the thumbnail cache
rm -rf ~/.cache/thumbnails/*

# Force-quit thunar and the tumblerd background service
thunar -q
pkill tumblerd
Tumbled will restart on its own when it is needed. When you open thunar again and navigate to your image directory ... your AVIF images will now generate thumbnails automatically like the other image format did already. Avif thumbnails in thunar

Vincent Bernat: Sidenotes with CSS anchor positioning

I am a heavy user of sidenotes:1 they keep optional content next to the text instead of sending the reader to the bottom of the page and back. Tufte CSS renders them without JavaScript but only accepts inline content. CSS anchor positioning, now supported by recent browsers,2 is an elegant alternative. Sidenotes can hold several blocks, still without JavaScript, and fall back below the paragraph referencing them on narrow viewports and older browsers. In 2023, Eric Meyer demonstrated this technique in Nuclear Anchored Sidenotes. The main improvement over other solutions is that the notes can sit anywhere in the HTML document. You can place them after the paragraph referencing them, as regular block elements for text browsers, screen readers, feed readers, and reader mode to render them properly:
Sidenotes rendered in Lynx appear after the paragraph they are called from.
Rendering in Lynx, a text browser
When the viewport is too narrow or the browser does not support CSS anchor positioning, you can style them so the reader can skip them or glance at them without losing their position in the text:
Sidenotes rendered on a narrow viewport appear with a distinctive typography after the paragraph they are called from.
Rendering below the paragraph on a narrow viewport
Once the viewport is large enough, they appear in the margin, at the same vertical position as the matching reference mark, unless they would collide with a previous sidenote, as in the example below:3
Sidenotes rendered on a large viewport appear in the margin. There are two of them. The first one is vertically aligned with the matching reference mark, while the second is rendered below as it would collide with the first otherwise.
Rendering in the margin on a large viewport
The gist of CSS anchoring is to position an element relative to another element the anchor. For the sidenotes, the anchor is the reference mark. I use the following markup, with a data attribute to specify the anchor name:
<sup id="fnref:YYY" data-anchor="--lf-sn-YYY">
  <a href="#sidenote-YYY">1</a>
</sup>
The matching note is an <aside> element carrying the same data attribute for the anchor name. We put it after the paragraph holding the reference mark:
<aside role="note" id="sidenote-YYY" data-anchor="--lf-sn-YYY">
  <sup>1</sup>
  <p>A first paragraph.</p>
  <p>A second paragraph.</p>
</aside>
On a narrow viewport or when the browser is too old for CSS anchoring, we style the sidenote, which stays below its paragraph, with a muted color:
aside[role="note"]  
  margin-block: 1rlh;
  color: #444;
 
On a wide viewport and when the browser is recent enough, we move the sidenote to the right margin:
@supports (anchor-name: attr(data-anchor type(<custom-ident>)))  
  @media (min-width: 72rem)  
    main  
      position: relative;
      sup[data-anchor]  
        anchor-name: attr(data-anchor type(<custom-ident>));
        /*   anchor-name: --lf-sn-YYY */
       
      aside[role="note"][data-anchor]  
        anchor-name: --lf-sidenote;
        position: absolute;
        position-anchor: attr(data-anchor type(<custom-ident>));
        /*   position-anchor: --lf-sn-YYY */
        top: max(anchor(top), anchor(--lf-sidenote bottom, -1rlh) + 1rlh);
        left: 100%;
        margin: 0 2rem;
        width: 18rem;
        color: inherit;
       
     
   
 
attr() extracts the anchor name for the reference mark from the data-anchor attribute. It returns a string, unless we specify a CSS unit or a type, like here: the browser parses the data attribute as a custom identifier, which anchor-name validates as a dashed identifier, a custom identifier starting with two dashes.4 The note itself is absolutely positioned past the right edge of the main block. It selects the matching reference mark as its anchor with position-anchor set to the value of the data-anchor attribute. Each note is also an anchor named --lf-sidenote. We use it to keep the next note from colliding with this one. The anchor() CSS function lets us position the note s top edge relative to its anchor: anchor(top) aligns the top edge of the note with the top edge of the reference mark. It can also take another anchor as a parameter: anchor(--lf-sidenote bottom) would align the top edge of the note with the bottom edge of the closest preceding anchor named --lf-sidenote so the previous note.5 Like attr(), anchor() accepts a fallback value as its second parameter and use it when the named anchor does not exist. The top property handles three cases, illustrated in the following diagram:
Diagram of three sidenotes anchored to their reference marks. The first one is aligned with the top of its own reference mark, as no note comes before it. The second one would overlap the first, so it takes the bottom of the first note as anchor and sits one line below it. The third one comes far enough down the page to align with its own reference mark again.
The three cases for the vertical position of a note
  1. The first note s top edge aligns with the top edge of its reference mark: as there is no previous note, anchor(--lf-sidenote bottom, -1rlh) + 1rlh resolves to 0 and max() returns anchor(top).
  2. When the reference mark of a later note sits above the bottom of the previous note, plus some vertical space, the note goes below the previous one to avoid a collision. max() returns anchor(--lf-sidenote bottom) + 1rlh.
  3. Otherwise, the note s top edge aligns with the reference mark s top edge, as max() returns anchor(top).

Have a look at the complete stylesheet, which also adapts the reference mark to the location of the note: a arrow when the note sits below the paragraph, a arrow when it moves to the margin. Gwern s Sidenotes In Web Design lists more implementations and their trade-offs. Some bloggers aim to write a post in 30 minutes. I planned to publish three web-related articles this weekend. Instead, I spent an inordinate amount of time elsewhere: about 15 commits on the build system, a pull request to update CSS highlighting for nested selectors in Pygments, and a small correction to MDN s article on the anchor() CSS function. The SVG illustration took a bit less than an hour and the article itself a handful of hours. The attr() function came in after I thought inline style looks ugly, isn t there a better way? But, hey, I still think this is worth it!

  1. My PhD advisor told me this is unwise.
  2. The first bits of anchor positioning are supported from Chrome 125 (May 2024), Firefox 147 (January 2026), and Safari 26 (September 2025). Before Safari 26.5, sidenotes may collide due to a bug in how dependency chains are handled. You can detect this situation with some JavaScript. It is, however, not needed in the solution described here as we depend on a more recent feature.
  3. If you noticed the runt in the first note, I share your pain and lament that Firefox does not implement text-wrap: pretty.
  4. Typed attr() is supported from Chrome 133 (February 2025), Firefox 155 (September 2026), and Safari 27 (September 2026). Check Una Kravets article for details. To support more browsers, you can inline the anchor name and the position anchor directly in the HTML:
    <sup id=" " style="anchor-name: --lf-sn- ">
      <a href="#sidenote- ">1</a>
    </sup>
    
    Managing Anchor Associations With Data Attributes and Advanced attr(), by Daniel Schwarz, explores CSS anchors and typed attr() in more detail.
  5. The exact rule for the target anchor element is more complex: if an ancestor of [the note] satisfies the following conditions, return the nearest such element to [the note]. Otherwise, return the last element in tree order that satisfies the conditions. One of these conditions is that [the candidate] is an acceptable anchor element for [the note], which requires that [the candidate] is laid out strictly before [the note], where the relevant clause is that [the candidate] is either not absolutely positioned or occurs earlier in the flat tree order than [the note].

6 September 2026

Iustin Pop: AI agents aha moment

Looking at the reactions to the Debian AI vote, I think some people still think the clock can be turned back, as if that ever worked in history. Rather than cry about spilled milk, I prefer to find a path forward in the new world. There are many ways to use LLMs, some of them are straightforward, others not so much. One of the not so clear areas for me is the focus on agentic workloads. For complex tasks, sure, you want something that can work in the background, but in general, why does every single tool go the agentic way? I much prefer the chat/ask approach, or even the code one, but if I m at the keyboard, why would I send a task to an agent, and see it work, instead of directly implementing it? And then, this past Friday, I finally understood one part of that. I was in the airport, sitting at the gate and waiting to board a flight, and because I arrived much earlier at the airport (fearing crowds due to Labour Day weekend), I got one hour of work before boarding started. As the time for boarding approached, I did one more commit after making sure tests pass, pushed, closed laptop, and went to walk a bit before getting on the plane. As I was getting up, I get a phone notification from GitHub that the CI run failed. I was quite surprised, as the local tests passed, so I open the notification, and realize that tests via make test vs CI (which additionally uses --pedantic) had slightly different settings, and of course I missed a build warning (which in CI is an error). I thought I d fix that on the plane, but then I saw a Copilot agent button in the mobile app. I was curious what it did, I click it, and I see Copilot starting a draft pull request, and saying:
Thanks for asking me to work on this. I will get started on it and keep this PR s description up to date as I form a plan and make progress. Fix the failing GitHub Actions job. Analyze the Actions logs, identify the root cause of the failure, and implement a fix.
Then it goes, finds the failure, writes the fix, and tries to run the tests. Well, it can t do it (it runs in a restricted container, so no network, so stack install couldn t actually work). The agent sees that, acknowledges it has no way to validate the fix, but the error message was clear enough that it was confident the fix is mostly correct, so it sends the pull request. I allow full CI to run on the pull request, and go buy a bottle of water. After that, I check and see that the CI failed again, as not one but two test files were broken, and I didn t have --keep-going, so the build stopped at the first failure. I write a comment in the pull request, no reaction, I realize I need to tag Copilot explicitly, I do that, and it starts another investigation. I m waiting now in the boarding queue, with phone in hand, while Copilot is fixing my bug. While I scan my boarding pass and walk towards the plane, the pull request is updated, I trigger another CI, it passes, and I merge it. And then, it hit me. Agents allow me to make progress while being not at keyboard , whether that s physically not at keyboard , or while working on something else. Fixing a simple test failure is not something that needs human attention per se, whereas improving the test layout might be. In that airport, using otherwise-unusable downtime, and without explicitly intending to, I made progress in understanding a different way to use AI. Now I have three ways to work with LLMs: ask (tutor mode), code (implement my request), and agent (fix simple or complex problems, autonomously). I still don t know about plan mode and really complex tasks, like asking it to implement features from scratch. That will probably be the next area to tackle. And today (Sunday), while waiting for a running race to start, I opened GitHub, and asked Copilot to increase test coverage for a simple module. It did, and yes it still can t run tests (I learned in the meantime that you can configure the environment in which the agent runs, nice), but after two back-and-forth messages, I have a pull request ready to review. All in the 20 minutes before a race, where I could either browse social media or actually do some meaningful work. Checking now my GitHub billing, it looks like all of this Copilot use only cost $1.92. Yes, that is under two dollars! And while it did use compute resources, the person across the aisle who watched TikTok or Instagram for half an hour while waiting for takeoff also consumed a lot of compute, and so do the gazillion cat videos uploaded to YouTube every day. To me, this is another tool in the toolbox, that might one day replace me (as it did to the 19th-century textile workers), or make me five times more productive we ll see where we end up. In the meantime, I can move faster, and make better use of my limited free time. Enjoy the ride!

Enrico Zini: Migrating away from .org/.net/.com domains

After having witnessed how easy it is for good people to lose a .org domain over a fascist tantrum (you can follow the Autistici/Inventati story here and here), I've started moving all my infrastructure to differently managed TLDs. enricozini.org and enricozini.com will keep being functional for the time being, as dropping a domain makes it available for squatting and impersonation. These new domains are now online, with working web and emails: It will take ages to migrate countless accounts that are tied to my primary email address, so better start early. Waiting to see what will happen with .meow domains, which I supported despite not identifying as a cat.

Enrico Zini: Migrating away from .org/.net/.com domains

After having witnessed how easy it is for good people to lose a .org domain over a fascist tantrum (you can follow the Autistici/Inventati story here and here), I've started moving all my infrastructure to differently managed TLDs. enricozini.org and enricozini.com will keep being functional for the time being, as dropping a domain makes it available for squatting and impersonation. These new domains are now online, with working web and emails: It will take ages to migrate countless accounts that are tied to my primary email address, so better start early. Waiting to see what will happen with .meow domains, which I supported despite not identifying as a cat.

Michael Stapelberg: Debian Code Search: Fast TurboPFor with Go SIMD

This August, I accomplished what I wanted for many years: I deleted the last cgo dependency in Debian Code Search! This was made possible by Go s recently introduced SIMD support, because now we can implement the TurboPFor integer compression format as efficiently more efficiently, in fact, by using the newer AVX512 instruction set! as the reference implementation.

Background: Why does DCS need a fast Integer Codec? Debian Code Search (DCS) is a search engine that allows searching all the Open Source source code within Debian, with either literal search expressions or regular expression search queries. A search engine uses an inverted index: a map from term to documents containing the term. Each document is typically represented most efficiently by using an id, so the index consists of many lists of document ids. When searching, it is important to quickly decode these lists to answer the search query. However, there is a point of diminishing returns where the decoding speed, even though it can still be measurably improved quite a bit, no longer influences the overall query duration. From 2012 (its inception) to 2019, Debian Code Search used to use a small index format, and queries were fast because the index was kept entirely in RAM. In 2019, I implemented the new index format, which adds an on-disk positional index. For literal queries (78.2% of DCS queries), querying the positional index on disk is faster than querying the non-positional index in RAM. The efficient encoding of the TurboPFor format makes it possible to fit such an index on a mid-sized Hetzner server, which I rent with two 1 TB SSD disks. The optimized decoder of the C TurboPFor library is what made decoding fast at query time. If you want to dive deeper into the algorithm, see this blog post from February 2019: If you want to learn more about the positional index, see this blog post from September 2019:

SIMD in Go For many years, you had the following options for using SIMD instructions in Go:
  1. Hand-writing Go assembler code. This is only doable for small functions, for example bytes.IndexByte is implemented with hand-written Go assembly (including AVX2).
  2. Generating Go assembler code with tools like Michael McLoughlin s Avo . This is how crypto/internal/fips140/sha256 uses AVX2. While Avo generator code definitely is higher-level than hand-written assembly, it is still too close to assembly for my taste.
  3. Use a C library via cgo so gcc or clang compiles SIMD code. Debian Code Search used to use the powturbo/TurboPFor C library via cgo for the last 7 years.
The C TurboPFor library has served us well, but Debian Code Search was always intended to be a project using Go, so I would prefer it if I did not have any C code in the project. Go 1.26 (released in February 2026) introduced the simd/archsimd package:
Go 1.26 introduces a new experimental simd/archsimd package, which can be enabled by setting the environment variable GOEXPERIMENT=simd at build time. This package provides access to architecture-specific SIMD operations. It is currently available on the amd64 architecture and supports 128-bit, 256-bit, and 512-bit vector types, such as Int8x16 and Float64x8, with operations such as Int8x16.Add. The API is not yet considered stable. Go 1.26 Release Notes
For my 2019 TurboPFor analysis, I implemented goturbopfor, a native Go teaching decoder (without any SIMD), because I find Go code easier to follow than C code, especially optimized C code. My implementation was intentionally not optimized so that the code was easier to study. The TurboPFor format/algorithm has a vector-optimized part: bitpacking comes in a scalar variant (bitunpack32) and a vector variant (bitunpack256v32), where the vector variant is used for full blocks (256 values) and the scalar variant is used for remainder blocks (< 256 values). When Go 1.26 was released, I used Claude Code to explore whether my native Go decoder s bitunpack256v32 function (for the vertical vector layout) could be implemented using Go SIMD, and the answer was yes, it was possible and it was faster than without SIMD, but not quite at the level of C TurboPFor. If you let Claude Code try for long enough, it eventually finds enough optimizations (about 10) to match C performance. I don t want to vibe-code Debian Code Search, though, so I figured I would find some time to review the SIMD code at some point and see if I could implement something similar myself. Before I found enough time and motivation to complete said review, I discovered that to not regress real-life query performance by more than 10 to 100 milliseconds (which seems acceptable), I don t actually need to add SIMD code to my teaching decoder at all; it would be sufficient to reduce allocations in my teaching decoder and specialize it per bit width. Encouraged by the possibility of using the optimized native Go decoder in Debian Code Search, I explored whether I could also implement a native Go encoder so that I could get rid of the C TurboPFor dependency entirely. The answer is yes, it is doable in a few days, and it isn t even that much slower: Go is at 76% of C, see Debian/dcs commit e920dc7. The goal I set myself at that point was to see if I could learn enough SIMD to optimize the native Go encoder such that its performance would match how DCS uses C TurboPFor (via cgo). Beating C TurboPFor was possible in 2-3 commits (SIMD and bit width specialization). To my surprise, Claude Fable 5 pointed out that the encoder s block scanning could be done more efficiently using a technique called positional popcount, and that is another 2x speed-up! To be clear: I am not saying the Go compiler beats C here. Certainly, the C compiler can also produce fast AVX512 code and can be used to implement positional popcount. When comparing apples to apples, i.e. backporting the AVX512 kernels and positional popcount technique to C TurboPFor, Go benchmarks a little slower at 1.4x C. This spectacular result (much faster than what DCS had before) got me curious how far I could push the decoder with SIMD after all. I ended up matching/exceeding the cgo version here, too! The rest of this article explains a few classes of optimizations I encountered along the way.

Starting Point When I wrote my goturbopfor teaching decoder, I named its functions to match the upstream C TurboPFor library, but now I want to get away from names like p4ndec256v32 they make sense from the TurboPFor perspective, but for Debian Code Search, we can use cleaner names. Before writing any code, I audited how DCS uses integer compression / decompression.

API design: BlockEncoder, BlockDecoder and streaming In Debian Code Search, we have the following usage patterns:
  • Partial Indexing: When a new package (or package version) enters Debian, all of its (text) files are indexed. If the hello-2.12.3-1 package (hypothetically) contained only hello.c with printf("hello!\n");, we would assign document ID 1 to hello.c and store in the partial index that trigrams pri, rin, int, ntf, etc. are all found in doc 1 (hello.c).
  • Full Index Merging: The many thousands of partial index files (for each Debian package) are combined into a small handful of large index files: When searching, it would be expensive to consult thousands of indexes. To merge multiple partial index files into one larger index (which can then be efficiently queried), we need to re-encode the partial index files: what used to be document ID 1 in the partial index might be document ID 2531 in the full index.
  • Querying (searching): When users enter search queries, these queries need to be answered as quickly as possible. The relevant entries in the full indexes are decoded (in parallel).
For reading the index, we do keep the decoded uint32s fully in memory, so we only need DecodeN(input []byte, output []uint32) (read int), a function that reads len(output) values (uint32) from input and returns how many bytes it consumed. For writing the index (both in partial indexing, and when merging), keeping the entire index in memory is prohibitively expensive, so we need a streaming API, for decoding and for encoding. Ultimately, I converged on the following API:
package pforenc

type BlockEncoder struct  
    // scratch buffers can go here
 

// EncodeBlock encodes len(vals)<=256 uint32s into dest (one TurboPFor block).
func (*BlockEncoder) EncodeBlock(dest []byte, vals []uint32) []byte  

// EncodeN calls EncodeBlock in a loop.
func (*BlockEncoder) EncodeN(dest []byte, vals []uint32) []byte  

type StreamEncoder struct  
  be   BlockEncoder
  vals [256]uint32
  // scratch buffers
 

// if full, you need to call [EncodeBlock]
func (*StreamEncoder) Add(val uint32) (full bool)

// EncodeBlock must be called after all data was [Add]ed.
//
// Write the returned buffer to file or send it over the network;
// it is only valid until the next [EncodeBlock] call.
func (*StreamEncoder) EncodeBlock() []byte  
  if se.n == 0   return nil   // turn an extra EncodeBlock into a no-op
  //  
 
This API (the decoder works similarly) allows us to process data in TurboPFor format without any memory allocations. The types are not safe for concurrent use by multiple goroutines. The zero value is ready to be used. For the streaming API, the result only stays valid until the next call.

Initial Implementation Before we can optimize anything, we need a working decoder and encoder. The decoder already exists: my goturbopfor teaching decoder. Next up, I needed an encoder. Writing a TurboPFor encoder has a delightfully simple starting point: You can encode all values at bit width 32, in little endian, at which point you only need to add a one-byte TurboPFor block header every 256 values and you re done:
func (be *BlockEncoder) EncodeN(dest []byte, vals []uint32) []byte  
  for len(vals) > 0  
    chunk := min(len(vals), 256)
    dest = be.EncodeBlock(dest, vals[:chunk])
    vals = vals[chunk:]
   
  return dest
 

func (be *BlockEncoder) EncodeBlock(dest []byte, vals []uint32) []byte  
  const bitWidth = 32
  dest = append(dest, bitWidth)
  for _, val := range vals  
    dest = binary.LittleEndian.AppendUint32(dest, val)
   
  return dest
 
Of course, this is a terribly inefficient compressor, so after the first commit, the real work starts: implement each block type until the compression matches the original C TurboPFor implementation (same output file size), or in other words: do the reverse of the decoder.
  1. The TurboPFor bitpacking block type (bitpacking implementation commit) encodes a bit stream of variable bit width (where the bit width is in range 0 bitWidth 32) in little endian byte order. By scanning all values and choosing the smallest bit width that allows representing all values, this technique saves disk space (compresses).
  2. The bitpacking with exceptions block type (bitpacking with exceptions implementation commit) determines two bit widths: one for values, the other bit width for encoding exceptions. This allows choosing a lower bit width (that does not cover all values) compared to the bitpacking block type. A bitmap encodes whether a value has an exception or not.
  3. The bitpacking with VB exceptions block type (bitpacking with VB exceptions implementation commit) is a variant which does not use an exception bitmap and encodes exceptions using a variable byte integer encoding. This is more efficient when there are few exceptions (less than 20) or the exceptions are very different in bit width compared to the other values.
  4. Lastly, the constant block type (constant implementation commit) stores just one value on disk. This is useful for all-zero or all-one blocks, for example.
I found it interesting to realize that the main work of the encoder is to scan the input values and choose the optimal block type, whereas the actual encoding itself is cheap in comparison. At this point, we can look at performance and see that the Go encoder is at 76% of the C encoder. In all honesty, I could have probably stopped here, but now that the milestone of a viable replacement was reached, I got curious to see how far it would be possible to push the encoder (how much work to reach C speeds?) and afterwards, the decoder, too.

Setup

The microarchitecture level: set GOAMD64 The microarchitecture of a CPU determines which instructions it provides, and that includes not just SIMD instruction sets (like AVX2), but also other useful instructions like LZCNT (Leading Zero Count), which can be used to implement math/bits.Len32 more efficiently, which the TurboPFor encoder needs to call on every input value to determine the ideal bit width. Let s walk through how to set the microarchitecture level when using Go on 64-bit x86 (x86-64). Go uses the GOARCH environment variable to configure the target compilation architecture, and I am using the value amd64 to select 64-bit x86 (AVX2 and AVX512 are instruction sets found on x86-64 CPUs). With GOARCH=amd64, the architecture-specific variable GOAMD64 configures the microarchitecture level for which to compile and Go 1.18 introduced these 4 different levels:
GOAMD64=v1 (default): The baseline.
Exclusively generates instructions that all 64-bit x86 processors can execute. GOAMD64=v2: all v1 instructions,
plus CMPXCHG16B, LAHF, SAHF, POPCNT, SSE3, SSE4.1, SSE4.2, SSSE3. GOAMD64=v3: all v2 instructions,
plus AVX, AVX2, BMI1, BMI2, F16C, FMA, LZCNT, MOVBE, OSXSAVE. GOAMD64=v4: all v3 instructions,
plus AVX512F, AVX512BW, AVX512CD, AVX512DQ, AVX512VL.
In 2026, I generally recommend compiling with GOAMD64=v3 so that functions like bits.OnesCount8 are compiled into intrinsics (POPCNT) instead of using a lookup table. For Intel CPUs, setting GOAMD64=v3 means your programs will only start on Haswell CPUs (2013) or newer; for AMD CPUs that means Zen 1 (2017) or newer. In this specific case (DCS), I am even compiling with GOAMD64=v4. The v4 microarchitecture level requires AVX512, which means AMD Zen 4, Zen 5 or newer (Intel s story is complicated). Luckily, both my main development PC (Zen 5) and the Debian Code Search server (Zen 4) are recent enough. Setting GOAMD64=v4 has little effect on Go 1.27 itself: the only change is that maps use one less instruction (VPBROADCASTB instead of PSHUFB). But compiling with GOAMD64=v4 allows us to move one more feature check from runtime to compile time, see SIMD build tags. It makes sense to set the microarchitecture level in your benchmark setup so that you don t measure the slow fallback implementations. I use export GOAMD64=v4 in my Makefile.

Benchmarking setup Go s built-in testing package contains support for benchmarks which are written in functions of the form func BenchmarkXxx(b *testing.B). The simplest way to run such benchmarks is go test -bench=., but I ended up configuring a few convenience make targets, which write results to bench.txt and compare against baseline.txt (the previous commit s results, usually), using the very useful benchstat tool.
GOTEST=go test

# -count=6 gives p 0.002 in benchstat:
# https://pkg.go.dev/golang.org/x/perf/cmd/benchstat
BENCHFLAGS=-run=^$$ -bench=. -benchtime=200000x -count=6

# use taskset -c1 to always pin to the same single core,
# avoiding accidental scheduling on different cores on
# mixed-core CPUs like the Ryzen 9 9950X3D.
TASKSET=taskset -c 1
BENCH=$(TASKSET) $(GOTEST) $(BENCHFLAGS)

.PHONY: all test bench bench-baseline bench-relative

all: test

bench: test
	$(BENCH)   tee bench.txt
# Compares compression ratio between C and Go implementation
	benchstat -col /impl -row '/n /vals' -filter '-/impl:go-stream .unit:(encoded-bytes)' bench.txt
# Compares performance between C (cgo) and Go implementation
	benchstat -col /impl -row '/n /vals' -filter '.unit:(Mval/s)' bench.txt

bench-baseline: test
	$(BENCH)   tee baseline.txt

bench-relative: test
	$(BENCH)   tee bench.txt
	benchstat -filter '-/impl:go-stream .unit:(encoded-bytes)' baseline.txt bench.txt
	benchstat -filter '/impl:go .unit:(Mval/s)' baseline.txt bench.txt
The encoded-bytes and Mval/s units are custom metrics I am reporting from the various sub-benchmarks, which are arranged such that I can filter / report them with benchstat. The main encoder (and decoder) benchmarks compare 3 different implementations (cgo, Go, Go with the StreamEncoder API) with a number of benchmark cases that are designed to cover the different block types and contain a similar mix of values as what we see in Debian Code Search:
// reportMetrics adds Mval/s and encoded-bytes metrics to all benchmarks.
func reportMetrics(b *testing.B, n int, nencoded int)  
   b.ReportMetric(float64(nencoded), "encoded-bytes")
   b.ReportMetric(float64(b.N*n)/1e6/b.Elapsed().Seconds(), "Mval/s")
 

// BenchmarkEncode/n=<N>/vals=<testcase>/impl=<c go go-stream>
//
// e.g. BenchmarkEncode/n=2048/vals=one-constant/impl=go-stream
func BenchmarkEncode(b *testing.B)  
   for _, tc := range allBenchCases()  
     n := len(tc.vals)
     b.Run(fmt.Sprintf("n=%d/vals=%s", n, tc.name), func(b *testing.B)  
       b.Run("impl=c", func(b *testing.B)  
         b.ReportAllocs()
         var encoded []byte
         buf := make([]byte, turbopfor.EncodingSize(n))
         for b.Loop()  
           encoded = turbopfor.P4nenc256v32Buf(buf, tc.vals)
          
         reportMetrics(b, n, len(encoded))
        )
       b.Run("impl=go", func(b *testing.B)  
         b.ReportAllocs()
         var be BlockEncoder
         var encoded []byte
         buf := make([]byte, 0, turbopfor.EncodingSize(n))
         for b.Loop()  
           encoded = be.EncodeN(buf, tc.vals)
          
         reportMetrics(b, n, len(encoded))
        )
       b.Run("impl=go-stream", func(b *testing.B)  
         b.ReportAllocs()
         var se StreamEncoder
         var encoded int
         for b.Loop()  
           encoded = 0
           for _, val := range tc.vals  
             if se.Add(val)  
               encoded += len(se.EncodeBlock())
              
            
           encoded += len(se.EncodeBlock())
          
         reportMetrics(b, n, encoded)
        )
      )
    
 

CPU counters: perf Go has included excellent performance tooling for many years, see the Profiling Go Programs blog post (2011) for an example of how to use pprof, a sampling profiler. This profiler can help track down which part of a program runs slow, or where memory allocations happen. Once you identified the slow part of a program, how do you know why it s slow? To learn more about the specific bottlenecks your program encounters, you can consult your CPU s hardware performance counters. For example, you could check the branch predictor counters to see if your program is slow due to a high number of branch mispredicts. On Linux, the perf tool is the best way to access the CPU hardware performance counters. A good starting point for working with perf is the documentation on Top-down analysis with the perf tool , which describes the optimization method that Intel established. In my Makefile, I set up two perf targets:
# GOTEST and TASKSET like shown in the earlier benchmarking setup section:
GOTEST=go test -pgo=encode.cpuprof
TASKSET=taskset -c 1
PERFBENCHFLAGS=-test.bench='Encode/n=2048/vals=debian-mix/impl=go$$' -test.benchtime=200000x

# Use perf(1) to capture AMD IBS (the equivalent to Intel PEBS)
# PipelineL1 is roughly equivalent to Intel TopdownL1
perf:
	$(GOTEST) -c
	$(TASKSET) perf stat -M PipelineL1 ./pforenc.test -test.run=^$$ $(PERFBENCHFLAGS)
	sudo perf record -F 4999 -e ibs_op// --call-graph fp ./pforenc.test -test.run=^$$ $(PERFBENCHFLAGS)
	sudo chmod 644 perf.data

# 488281 iterations   2048 values = 1.000e9 values, so counter/1e9 = per value.
perf-per-value:
	$(GOTEST) -c
	$(TASKSET) perf stat -x, -e cycles:u,instructions:u,branches:u,branch-misses:u ./pforenc.test -test.run=^$$ -test.bench='Encode/n=2048/vals=debian-mix/impl=go$$' -test.benchtime=488281x 2>&1 >/dev/null   awk -F, ' printf "%-16s %6.2f /val\n", $$3, $$1/1e9 '
The perf-per-value numbers are high level numbers that indicate how much work the implementation is doing. Reducing the number usually increases speed. To see the counters for each instruction (and source code lines), I use make perf, followed by perf report. A quick shortcut is perf annotate, which directly shows the hottest function.

Optimizations (scalar) Let s first see how far we can get without reaching for SIMD instructions. (The examples are not necessarily in commit order, but cherry-picked for clarity.)

Profile-Guided Optimization (PGO) PGO stands for Profile-Guided Optimization and is a feature that Go introduced as a preview in Go 1.20 (released in February 2023) and shipped as ready for general production use in Go 1.21 (released in August 2023). The idea is to capture a CPU profile that records where your program spends most of its CPU time, which you then provide to the Go compiler to give it more data to make better decisions. Most importantly, this way the Go compiler can inline functions much more aggressively than its usual heuristics allow, which does have a measurably positive effect in my series of optimization commits. Another optimization that a PGO profile allows the compiler to do is conditional devirtualization but our TurboPFor code does not use any interfaces. My strategy is to enable PGO before doing any other optimizations, so that we have the full inlining budget available that PGO gives us, and can measure the effect of other commits clearly. Surprisingly, turning on PGO actually decreases our performance (-13% geomean), but a closer investigation reveals that we just got unlucky. Let me explain. Aside from inlining and conditional devirtualization, PGO also influences alignment: The Go compiler sets PCALIGNMAX(64, 31) on the first block of a loop (the loop body ) for all loops in hot functions (per the PGO profile), i.e. Go will insert up to 31 bytes of padding to make the block land on a 64-byte boundary. Documentation like AMD s Software Optimization Guide for the AMD Zen5 Microarchitecture (2024, #58455) explicitly recommends aligning hot loops that way:
[ ] for hot loops, some further knowledge of trade-offs can be helpful. Because the processor can read an aligned 64-byte fetch block every cycle, it is suggested to either align the start of the loop to the beginning of a 64-byte cache line [ ]
Indeed, when compiling with -gcflags=all=-d=alignhot=0 to disable the alignment, performance remains as good as without PGO. How can the padding hurt more than help? The answer is: It s not the padding itself! It s a side-effect of the padding moving instructions to different addresses. In the unlucky arrangement, a macro-fused CMPQ+JGE instruction pair now ends up exactly on a 32-byte boundary. However, the Go compiler ensures fused branch sequences must never cross or end at a 32-byte boundary to fix Intel erratum SKX102 (discussion: Go issue #35881) by inserting NOPs. This NOP padding, unlike the loop alignment padding, is not free; these extra instructions slow down our otherwise dispatch-bound loops. Because the commits after the PGO enabling commit change the code, this unlucky situation is avoided for the rest of the optimization series (by chance).

Reducing memory allocations Memory allocations are quite expensive, at least in comparison to encoding/decoding integers, so I followed my usual strategy of first reducing memory allocations as much as possible. In my goturbopfor teaching decoder, whenever the code needed a scratch buffer, it would allocate it right then and there with make():
// p4dec32 decodes one block of TurboPFor-encoded 32 bit ints
func (d *decoder) p4dec32(input []byte, output []uint32) (read int)  
    //  
  switch blockType  
  case blockBitpackingExceptions:
    bx, input := input[0], input[1:]
    n := len(output)

    exmap := input
    nex := 0 // number of exceptions
    for i := 0; i < n; i++  
      if exmap[i/8]&(1<<uint(i%8)) != 0  
        nex++
       
     
    input = input[(n+7)/8:]

    exceptions := make([]uint32, nex)
    input = input[bitunpack32(input, exceptions, bx):]
    input = input[d.bitunpack(input, output, b):]

    for i := 0; i < n; i++  
      if exmap[i/8]&(1<<uint(i%8)) != 0  
        output[i] += exceptions[0] << b
        exceptions = exceptions[1:]
       
     

    return before - len(input)
   
 
The Go compiler can turn make(T, n) calls into stack allocations, if n is known at compile-time. But, in this case nex is not known at compile-time. We can verify that Go calls into the runtime (runtime.makeslice) by dumping the object code (assembly) with source annotated (-S):
% cd ~/go/src/github.com/stapelberg/goturbopfor
% git reset --hard 49b7c05cc61e77f0257568eb73833467714d2b4a
% go test -c  # go1.27.0
% go tool objdump -S goturbopfor.test   perl -nlE 'say if /p4dec32/ .. /^$/'
TEXT github.com/stapelberg/goturbopfor.(*decoder).p4dec32(SB) /home/michael/go/src/github.com/stapelberg/goturbopfor/goturbopfor.go
func (d *decoder) p4dec32(input []byte, output []uint32) (read int)  
  0x549f60		4c8da42460ffffff	LEAQ 0xffffff60(SP), R12
  0x549f68		4d3b6610		CMPQ R12, 0x10(R14)
  0x549f6c		0f86d9070000		JBE 0x54a74b
  0x549f72		55			PUSHQ BP
  0x549f73		4889e5			MOVQ SP, BP
  0x549f76		4881ec18010000		SUBQ $0x118, SP
  0x549f7d		48899c2430010000	MOVQ BX, 0x130(SP)
  0x549f85		4889b42448010000	MOVQ SI, 0x148(SP)
	if len(output) == 0  
  0x549f8d		4d85c0			TESTQ R8, R8
  0x549f90		0f84a7030000		JE 0x54a33d
  0x549f96		660f1f840000000000	NOPW 0(AX)(AX*1)
  0x549f9f		90			NOPL
[ ]
		exceptions := make([]uint32, nex)
  0x54a4be		488d057bec1700		LEAQ 0x17ec7b(IP), AX
  0x54a4c5		4c89fb			MOVQ R15, BX
  0x54a4c8		4889d9			MOVQ BX, CX
  0x54a4cb		e8f0ddf3ff		CALL runtime.makeslice(SB)
[ ]
An easy speed-up was to avoid allocations through reuse (in goturbopfor). In the DCS pfordec package (with the improved API design), I ended up with a vals [256]uint32 field in the StreamDecoder type, which brings us from 773 Mval/s to 858 Mval/s on the debian-mix:
% benchstat -filter '/impl:go /vals:debian-mix .unit:(Mval/s)' \
  baseline.txt bench.txt
goos: linux
goarch: amd64
pkg: github.com/Debian/dcs/internal/turbopfor/pfordec
cpu: AMD Ryzen 9 9950X3D 16-Core Processor
             baseline.txt               bench.txt               
                Mval/s        Mval/s     vs base                
n=2048        1.089k   1%   1.175k   0%   +7.85% (p=0.002 n=6)
n=2039         974.7   0%   1046.0   0%   +7.32% (p=0.002 n=6)
n=160          434.9   1%    513.6   5%  +18.11% (p=0.002 n=6)
geomean        772.9         857.7       +10.98%
Aside from the speed-up, avoiding memory allocations is generally nice in benchmarks because it removes the garbage collector from the equation and makes it less likely that your benchmarks get other processes OOM-killed on the same machine.

Generics for bit width specialization In general, we want to make it easy for the compiler to understand as much as possible about our algorithm. Consider this bitpack implementation:
func bitpack(dest []byte, vals []uint32, bitWidth int) []byte  
  mask := uint32(1<<bitWidth - 1)
  var acc uint64
  var have int
  for _, val := range vals  
    acc  = uint64(val&mask) << have
    have += bitWidth
    for have >= 32  
      dest = binary.LittleEndian.AppendUint32(dest, uint32(acc))
      acc >>= 32
      have -= 32
     
   
  for have > 0  
    dest = append(dest, byte(acc))
    acc >>= 8
    have -= 8
   
  return dest
 
Let s think through what determines the iterations and control flow this function uses:
  1. The number of input values (vals), but not their actual value.
  2. The bit width to pack into (bitWidth).
With a bit of careful rearrangement, we can provide the compiler with both, a fixed number of input values (say, 32), and a bit width, both known at compile time. Why is this worthwhile? Because we can manually unroll the loop, let the compiler eliminate much of the repetition and get much faster compiled code as a result! Let s first fix the number of input values to 32 and rewrite the loop to calculate the position offsets within dest instead of changing dest on each value (with AppendUint32):
func bitpack32Unrolled(dest []byte, vals *[32]uint32, bitWidth int)  
  // only one bounds check for 32 values
  dest = dest[: 4*bitWidth : 4*bitWidth]
  mask := uint32(1<<bitWidth - 1)
  var acc uint64
  var have, pos int
  // Manually unrolled loop starts here.
  // Each iteration is identical except for the vals[x] index.
  acc  = uint64(vals[0]&mask) << have
  have += bitWidth
  if have >= 32  
    binary.LittleEndian.PutUint32(dest[pos:pos+4], uint32(acc))
    pos += 4
    acc >>= 32
    have -= 32
   

  // vals[1] .. vals[30] elided for brevity

  // Each loop iteration is 8 lines of Go code, so for 32 input values,
  // bitpack32Unrolled contains 8*32 = 256 lines of code.

  acc  = uint64(vals[31]&mask) << have
  have += bitWidth
  if have >= 32  
    binary.LittleEndian.PutUint32(dest[pos:pos+4], uint32(acc))
    pos += 4
    acc >>= 32
    have -= 32
   

  // have == 0; for all bitWidths
 
Next, we want to specialize not just for 32 input values, but also for each of the 32 bit widths. Can we do better than hand-copying bitpack32Unrolled 32 times (= 8192 lines of Go code)? Yes, we can use Go generics to help us with the code generation! In Go, array types like [4]byte (not slices like []byte!) contain the length of the array as part of their type, meaning [1]byte (an array of length 1) is a different type than [2]byte. Instead of passing the bit width as a function parameter, we can declare 32 different types (one for each bit width) and recover the bit width (at compile time!) from the type system:
type bitWidthT interface  
  [1]byte   [2]byte   [3]byte   [4]byte   [5]byte  
  [6]byte   [7]byte   [8]byte   [9]byte   [10]byte  
  [11]byte   [12]byte   [13]byte   [14]byte   [15]byte  
  [16]byte   [17]byte   [18]byte   [19]byte   [20]byte  
  [21]byte   [22]byte   [23]byte   [24]byte   [25]byte  
  [26]byte   [27]byte   [28]byte   [29]byte   [30]byte  
  [31]byte   [32]byte
 

func bitpack32Unrolled[T bitWidthT](dest []byte, vals *[32]uint32)  
  var zero T
  bitWidth := len(zero)                  // known at compile time
  dest = dest[: 4*bitWidth : 4*bitWidth] // make cap known at compile time
  mask := uint32(1<<bitWidth - 1)
  var acc uint64
  var have, pos int
  // Manually unrolled loop starts here.
  // Each iteration is identical except for the vals[x] index.
  acc  = uint64(vals[0]&mask) << have
  have += bitWidth
  if have >= 32  
    binary.LittleEndian.PutUint32(dest[pos:pos+4], uint32(acc))
    pos += 4
    acc >>= 32
    have -= 32
   

  // vals[1] .. vals[31] elided for brevity
 
When we instantiate bitpack32Unrolled[bitWidthT] with all 32 different types ([1]byte, [2]byte, , [32]byte), the compiler substitutes the bitWidthT type parameter and produces 32 copies of the function, which we can find in our compiled executable with names like github.com/Debian/dcs/internal/turbopfor/pforenc.bitpack32Unrolled[go.shape.[12]uint8]. The shape of a generic type is based on its memory layout, so a shape for [1]byte must be different than the shape for [2]byte. Because the bitWidth is now known at compile time, the Go compiler can generate close to the optimal machine code for each bit width, which we can confirm using go tool objdump. The code is branchless (after the one bounds check per 32 values) and aside from the loads and stores (from/to memory) consists only of shifts and bit operations, all with constant operands:
% go test -c && go tool objdump -S pforenc.test
[ ]
TEXT github.com/Debian/dcs/internal/turbopfor/pforenc.bitpack32Unrolled[go.shape.[28]uint8](SB) /home/michael/dcs/internal/turbopfor/pforenc/bitpackunroll.go
func bitpack32Unrolled[T bitWidthT](dest []byte, vals *[32]uint32)  
  0x660580              55                      PUSHQ BP
  0x660581              4889e5                  MOVQ SP, BP
  0x660584              48895c2418              MOVQ BX, 0x18(SP)
        dest = dest[: 4*bitWidth : 4*bitWidth] // make cap known at compile time
  0x660589              4883ff70                CMPQ DI, $0x70
  0x66058d              0f820b030000            JB 0x66089e
        acc  = uint64(vals[0]&mask) << have
  0x660593              8b06                    MOVL 0(SI), AX
  0x660595              25ffffff0f              ANDL $0xfffffff, AX
        acc  = uint64(vals[1]&mask) << have
  0x66059a              8b4e04                  MOVL 0x4(SI), CX
  0x66059d              81e1ffffff0f            ANDL $0xfffffff, CX
  0x6605a3              48c1e11c                SHLQ $0x1c, CX
  0x6605a7              4809c8                  ORQ CX, AX
                acc >>= 32
  0x6605aa              4889c1                  MOVQ AX, CX
  0x6605ad              48c1e820                SHRQ $0x20, AX
                binary.LittleEndian.PutUint32(dest[pos:pos+4], uint32(acc))
  0x6605b1              90                      NOPL
        b[0] = byte(v)
  0x6605b2              890b                    MOVL CX, 0(BX)
        acc  = uint64(vals[2]&mask) << have
  0x6605b4              8b4e08                  MOVL 0x8(SI), CX
  0x6605b7              81e1ffffff0f            ANDL $0xfffffff, CX
  0x6605bd              48c1e118                SHLQ $0x18, CX
  0x6605c1              4809c1                  ORQ AX, CX
                acc >>= 32
  0x6605c4              4889c8                  MOVQ CX, AX
  0x6605c7              48c1e920                SHRQ $0x20, CX
                binary.LittleEndian.PutUint32(dest[pos:pos+4], uint32(acc))
  0x6605cb              90                      NOPL
        b[0] = byte(v)
  0x6605cc              894304                  MOVL AX, 0x4(BX)
Now we need to actually call bitpack32 from the general bitpack function:
func bitpack(dest []byte, vals []uint32, bitWidth int) []byte  
  if bitWidth == 0  
    return dest // no payload, sparse block with only exceptions
   
  if len(vals) >= 32  
    size := 4 * bitWidth
    for len(vals) >= 32  
      existing := len(dest)
      dest = slices.Grow(dest, size)[:existing+size]
      bitpack32(dest[existing:] /*append*/, (*[32]uint32)(vals), bitWidth)
      vals = vals[32:]
     
   
  mask := uint32(1<<bitWidth - 1)
  var acc uint64
  var have int
  for _, val := range vals  
    acc  = uint64(val&mask) << have
    have += bitWidth
    for have >= 32  
      dest = binary.LittleEndian.AppendUint32(dest, uint32(acc))
      acc >>= 32
      have -= 32
     
   
  for have > 0  
    dest = append(dest, byte(acc))
    acc >>= 8
    have -= 8
   
  return dest
 

func bitpack32(dest []byte, vals *[32]uint32, bitWidth int)  
  switch bitWidth  
  case 1: bitpack32Unrolled[[1]byte](dest, vals)
  case 2: bitpack32Unrolled[[2]byte](dest, vals)
  case 3: bitpack32Unrolled[[3]byte](dest, vals)
  case 4: bitpack32Unrolled[[4]byte](dest, vals)
  case 5: bitpack32Unrolled[[5]byte](dest, vals)
  case 6: bitpack32Unrolled[[6]byte](dest, vals)
  case 7: bitpack32Unrolled[[7]byte](dest, vals)
  case 8: bitpack32Unrolled[[8]byte](dest, vals)
  case 9: bitpack32Unrolled[[9]byte](dest, vals)
  case 10: bitpack32Unrolled[[10]byte](dest, vals)
  case 11: bitpack32Unrolled[[11]byte](dest, vals)
  case 12: bitpack32Unrolled[[12]byte](dest, vals)
  case 13: bitpack32Unrolled[[13]byte](dest, vals)
  case 14: bitpack32Unrolled[[14]byte](dest, vals)
  case 15: bitpack32Unrolled[[15]byte](dest, vals)
  case 16: bitpack32Unrolled[[16]byte](dest, vals)
  case 17: bitpack32Unrolled[[17]byte](dest, vals)
  case 18: bitpack32Unrolled[[18]byte](dest, vals)
  case 19: bitpack32Unrolled[[19]byte](dest, vals)
  case 20: bitpack32Unrolled[[20]byte](dest, vals)
  case 21: bitpack32Unrolled[[21]byte](dest, vals)
  case 22: bitpack32Unrolled[[22]byte](dest, vals)
  case 23: bitpack32Unrolled[[23]byte](dest, vals)
  case 24: bitpack32Unrolled[[24]byte](dest, vals)
  case 25: bitpack32Unrolled[[25]byte](dest, vals)
  case 26: bitpack32Unrolled[[26]byte](dest, vals)
  case 27: bitpack32Unrolled[[27]byte](dest, vals)
  case 28: bitpack32Unrolled[[28]byte](dest, vals)
  case 29: bitpack32Unrolled[[29]byte](dest, vals)
  case 30: bitpack32Unrolled[[30]byte](dest, vals)
  case 31: bitpack32Unrolled[[31]byte](dest, vals)
  case 32: bitpack32Unrolled[[32]byte](dest, vals)
   
 
Encoding remainder blocks is quite a bit faster (full blocks use the vertical layout anyway):
% benchstat -filter '/impl:go /n:160 .unit:(Mval/s)' baseline.txt bench.txt
goos: linux
goarch: amd64
pkg: github.com/Debian/dcs/internal/turbopfor/pforenc
cpu: AMD Ryzen 9 9950X3D 16-Core Processor
                           baseline.txt               bench.txt               
                              Mval/s        Mval/s     vs base                
vals=bitpacking-bw1          751.2   3%   1120.5   0%  +49.15% (p=0.002 n=6)
vals=bitpacking-bw2          716.8   2%   1176.0   0%  +64.07% (p=0.002 n=6)
vals=bitpacking-bw7          700.0   1%   1078.5   0%  +54.08% (p=0.002 n=6)
vals=bitpacking-bw1-exc      524.8   1%    736.8   0%  +40.40% (p=0.002 n=6)
vals=bitpacking-bw2-exc      543.7   1%    758.2   0%  +39.46% (p=0.002 n=6)
vals=bitpacking-bw7-exc      566.7   1%    787.7   0%  +38.99% (p=0.002 n=6)
vals=bitpacking-vb-exc       442.6   1%    616.5   0%  +39.29% (p=0.002 n=6)
vals=sparse-exc              532.4   0%    787.8   0%  +47.97% (p=0.002 n=6)
vals=sparse-vb-exc           408.9   1%    597.8   0%  +46.20% (p=0.002 n=6)
vals=debian-mix              559.5   0%    783.8   9%  +40.09% (p=0.002 n=6)
This performance win comes at the cost of binary size increase. In this case, the .text section (executable code) grows by about 20 KB and the .gopclntab section grows by another 26 KB. Definitely a price I am very willing to pay, but the case might not be as clear in all circumstances.

Optimization: Bigger strides with SIMD Even without reaching for SIMD instructions, a TurboPFor implementation can be made faster by making it work bigger strides. Take this code from the goturbopfor teaching decoder which counts the number of exceptions by checking if each value s bit is set in the exception bitmap:
case blockBitpackingExceptions:
  bx, input := input[0], input[1:]
  n := len(output)

  exmap, input := input, input[(n+7)/8:]
  nex := 0 // number of exceptions
  for i := range n  
    if exmap[i/8]&(1<<uint(i%8)) != 0  
      nex++
     
   
  exceptions := d.scratch[:nex]
We can use the bits.OnesCount64 functions to count ones bits in the exception bitmap, 64 values at a time. For remainder blocks, the rest is processed 8 values (1 byte) at a time:
i := 0
for ; i+8 <= n/8; i += 8  
  xm8 := binary.LittleEndian.Uint64(exmap[i:])
  nex += bits.OnesCount64(xm8)
 
for ; i < (n+7)/8; i++  
  xmb := exmap[i]
  // Clear the bits which do not belong to the exception map:
  if rem := n - i*8; rem < 8  
    xmb &= 1<<rem - 1
   
  // Go compiles OnesCount32 into an intrinsic,
  // but not OnesCount8, so we convert to uint32:
  nex += bits.OnesCount32(uint32(xmb))
 
OnesCount64 uses a 64-bit register. For comparison, AVX2 SIMD instructions use 256-bit registers (= 8 uint32) and AVX512 SIMD instructions use 512-bit registers. In the following sections, we will first set up our build tags for conditional compilation to use a trivial SIMD instruction, then walk through an AVX2 and AVX512 SIMD kernel.

SIMD build tags Let s assume we have the following scalar code: constant.go:
package pfordec

func fillConstant(output []uint32, val uint32)  
  for i := range output  
    output[i] = val
   
 
To increase throughput, we can use AVX2 instructions if they are available on the CPU on which the program runs, i.e. using runtime dispatch. We ll first rename fillConstant to fillConstantScalar (it s now the fallback path): constant.go:
package pfordec

func fillConstantScalar(output []uint32, val uint32)  
  for i := range output  
    output[i] = val
   
 
Next, we ll supply two different implementations (constant_nosimd.go and constant_amd64.go), the latter of which is selected when compiling for GOARCH=amd64 with GOEXPERIMENT=simd (the latter will hopefully be dropped in a later version of Go). The nosimd variant just dispatches to the fillConstantScalar, which will likely be inlined:
//go:build !goexperiment.simd   !amd64

package pfordec

func fillConstant(output []uint32, val uint32)  
  fillConstantScalar(output, val)
 
The constant_amd64.go variant assigns the hasAVX2 global variable by doing a CPUID check and then jumps to the scalar fallback if !hasAVX2, i.e. the CPU is too old:
//go:build goexperiment.simd && amd64

package pfordec

import "simd/archsimd"

var hasAVX2 = archsimd.X86.AVX2()

func fillConstant(output []uint32, val uint32)  
  if !hasAVX2  
    fillConstantScalar(output, val)
    return
   
  val8 := archsimd.BroadcastUint32x8(val)
  i := 0
  for ; i+8 <= len(output); i += 8  
    val8.StoreArray((*[8]uint32)(output[i : i+8]))
   
  // use the scalar implementation for the last <= 7 elements
  fillConstantScalar(output[i:], val)
 
We can go one step further by conditionally compiling const hasAVX2 = true when GOAMD64 is set to v3 or higher (i.e. the amd64.v3 build tag is set). As a practical example from Debian Code Search, we currently need the following checks / dispatches:
code function vector instruction set GOAMD64
encoder bitpack256v AVX2 GOAMD64=v3
encoder exbitmap AVX512 GOAMD64=v4
encoder scan AVX512+VBMI+GFNI+BITALG n/a
decoder bitunpack AVX2 GOAMD64=v3
decoder bitunpack256v32 AVX2 GOAMD64=v3
decoder bitunpack256v32Ex AVX512 GOAMD64=v4
In DCS, the effect is measurably positive, but small.

The 256 uint32 vertical layout First, here is the layout explanation from my 2019 TurboPFor analysis blog post:
In regular (non-SIMD) bitpacking, integers are stored on disk one after the other, padded to a full byte, as a byte is the smallest addressable unit when reading data from disk. For example, if you bitpack only one 3 bit int, you will end up with 5 bits of padding. SIMD bitpacking works like regular bitpacking, but processes 8 uint32 little-endian values at the same time, leveraging the AVX instruction set. The following illustration shows the order in which 3-bit integers are decoded from disk:
The scalar implementation uses an array of 8 uint64 to process 8 values at a time:
func bitunpack256v32(input []byte, dest []uint32, bitWidth int) (read int)  
  mask := uint64(1)<<bitWidth - 1
  orig := len(input)
  var bits uint
  var acc [8]uint64 // accumulator: current+next bits
  for op := 0; op < len(dest);  
    if bits < uint(bitWidth)  
      // read 8 more uint32s
      for i := range 8  
        acc[i]  = uint64(binary.LittleEndian.Uint32(input)) << bits
        input = input[4:]
       
      bits += 32
     
    for i := range 8  
      dest[op] = uint32(acc[i] & mask)
      op++
      acc[i] >>= bitWidth
     
    bits -= uint(bitWidth)
   
  return orig - len(input)
 
The SIMD version also processes 8 values, but without a for i := range 8 loop! One difference is that we no longer have the luxury of using uint64 for acc (holding rest and current bits); because AVX2 registers only fit 8 uint32 (not 8 uint64). Instead, we split acc into rest8 and cur8.
func bitunpack256v32(fullinput []byte, fulldest []uint32, bitWidth int) (read int)  
  dest := fulldest[:256]
  if bitWidth == 0  
    clear(dest)
    return 0
   
  n := 32 * int(bitWidth)
  input := fullinput[:n] // tell the Go compiler how long the input is
  mask8 := archsimd.BroadcastUint32x8(uint32(1)<<bitWidth - 1)
  bitWidth8 := archsimd.BroadcastUint32x8(uint32(bitWidth))
  var bits uint
  pos := 0
  // var acc [8]uint64
  var rest8 archsimd.Uint32x8
  var cur8 archsimd.Uint32x8
  for op := 0; op < 256; op += 8  
    if bits < uint(bitWidth)  
      // read 8 more uint32s
      // acc[i]  = uint64(binary.LittleEndian.Uint32(input)) << bits
      next := archsimd.LoadUint8x32(input[pos : pos+32]).ReshapeToUint32s()
      pos += 32  // input = input[4:]
      cur8 = rest8.Or(next.ShiftAllLeft(uint64(bits)))
      // acc[i] >>= bitWidth
      rest8 = next.ShiftAllRight(uint64(uint(bitWidth) - bits))
      bits += 32
      else  
      cur8 = rest8
      // acc[i] >>= bitWidth
      rest8 = rest8.ShiftRight(bitWidth8)
     
    // dest[op] = uint32(acc[i] & mask)
    cur8.And(mask8).Store(dest[op : op+8])
    bits -= uint(bitWidth)
   
  return n
 
The SIMD version benchmarks about 3x as fast as the scalar version. Another significant speedup is to use generics for bit width specialization for this SIMD kernel so that bitWidth becomes a compile-time constant and the compiler can generate better code.

Positional Popcount For my TurboPFor encoder, I implemented the same techniques as described above:
  1. Bitpack full blocks with SIMD (AVX2)
  2. Gather exceptions using SIMD (AVX512)
  3. Use generics to specialize per bit width
These changes are sufficient to roughly match the cgo performance, but then Claude Fable 5 found another 2x speed-up on top of that! The key observation is that once encoding blocks is fast, the preceding step of scanning the input values to decide which block type to use becomes the bottleneck. Here is the encoder s main encode function, which first does one pass over the input values (scan) and then prices all different block types at all relevant bit widths (requires fast access to the scan histogram):
func (be *BlockEncoder) encode(dest []byte, vals []uint32, layout blockLayout) []byte  
  var stats stats
  scan(&stats, vals) // gathers statistics from every value in vals
  bitWidth := bits.Len32(stats.or)
  if stats.or == stats.and  
    return be.encodeConstant(dest, vals, bitWidth)
   
  n := len(vals)
  // bitpacking is the default, unless we find a more efficient block type.
  bestType := blockBitpacking
  bestB := bitWidth
  best := priceBitpack(n, bitWidth, layout)

  // Walk from high bitWidths to low: to break ties, we prefer
  // the encoding with fewer exceptions (for faster decoding).
  for b := bitWidth - 1; b >= 0; b--   // up to 32 iterations
    nex := int(stats.cnt[b])
    size := priceBitpackExceptions(n, b, bitWidth, nex, layout)
    if size < best  
      bestType = blockBitpackingExceptions
      bestB = b
      best = size
     
    // Over-approximate the number of VB bytes.
    vb := nex + // exceptions using 1, 2, 3, 4, or 5 VB bytes
      int(stats.cnt[b+7]+ // exceptions using 2, 3, 4, or 5 VB bytes
        stats.cnt[b+14]+ // exceptions using 3, 4, or 5 VB bytes
        stats.cnt[b+19]+ // exceptions using 4 or 5 VB bytes
        stats.cnt[b+24]) // exceptions using 5 VB bytes
    size = headerBytes + headerExBytes + payloadBytes(n, b, layout) + vb + nex
    if size < best  
      bestType = blockBitpackingVBExceptions
      bestB = b
      best = size
     
   
  switch bestType  
  case blockBitpacking:
    return be.encodeBitpack(dest, vals, layout, bitWidth)
  case blockBitpackingExceptions:
    return be.encodeBitpackExc(dest, vals, layout, bestB, bitWidth-bestB)
  case blockBitpackingVBExceptions:
    return be.encodeBitpackVBExc(dest, vals, layout, bestB, int(stats.cnt[bestB]))
  default:
    panic("BUG: bestType not implemented")
   
 
I ll show you a slightly shortened version of scan, the function which is the bottleneck:
type stats struct  
  // cnt[n] = how many values where bits.Len32(val)>n,
  // i.e. how many exceptions are required for bitWidth=n.
  // Padded so that cnt[b+24] is always in bounds.
  cnt [32 + 24]uint32
 

func scan(output *stats, vals []uint32)  
  for _, val := range vals  
    for b := range bits.Len32(val)  
      output.cnt[b]++ // b bits are not enough to store val
     
   
 
Let s consider the following 3 example values to understand the resulting cnt:
input input (bin) bits.Len32
23 0b0000010111 5
5 0b0000000101 3
666 0b1010011010 10
The resulting cnt exception count histogram would contain (cnt shortened to c):
c[0] c[1] c[2] c[3] c[4] c[5] c[6] c[7] c[8] c[9] c[10]
3 3 3 2 2 1 1 1 1 1 0
In words, this means that at bit width 10, we could encode all the values without any exceptions. But most values do not need 10 bits, so a bit width of 5 would be more efficient, but requires storing one exception. Encoding at bit width 4 requires 2 exceptions, and so on. The scan function above is intentionally kept simple for illustration. We can make it faster by moving the per-bit-width loop outside the per-element loop. The fast version still needs about 12 instructions per value. With SIMD, we can reduce this to by 8x to only 1.5 instructions per value!

The trick: smear masks enable positional popcount The trick is to turn each input value into its smear mask (imagine taking the first 1 bit and smearing it across the remaining positions). Here are the smear masks for our example:
input input (bin) bits.Len32 smear mask
23 0b0000010111 5 0b0000011111
5 0b0000000101 3 0b0000000111
666 0b1010011010 10 0b1111111111
Turning a value into its smear mask is computationally cheap: Go implements BitLen(x) (functions like bits.Len32) by calculating 32 - LZCNT(x). We can calculate the smear mask of a value with ^uint32(0) >> LZCNT(x), i.e. starting with a 32-one-bits mask and shifting it by the number of leading zeros. Now, to obtain e.g. cnt[4], we can count the 1 bits at bit position 4 of all input values. The POPCNT instruction counts bits very efficiently, but it counts one bits within a register, so it counts rows, not columns. Counting columns is called Positional Population Count. I found the following papers that describe positional popcount with SIMD:

Positional Popcount: a visual explanation To understand the AVX512 implementation of positional popcount, I found it most helpful to visualize an AVX512 register (512 bits, i.e. 64 bytes). The graphic below uses the Uint64x8 layout, meaning it divides the register into 8 lanes of 64 bits (= 8 bytes) each. This illustration shows the whole process: how uint32s are loaded into an AVX512 register (all 4 of its bytes, in sequence) and where we end up, i.e. the 32 positional popcounts: Let s break down this process into its individual steps. First, we turn each loaded value into its smear mask as explained above. The VPOPCNTB vector instruction calculates POPCNT (1 byte) of 64 bytes at once, but first we need to shuffle the bytes inside the register: in load order, we have a full uint32 (4 bytes), followed by another uint32, per lane. First, we permute the bytes (VPERMB) such that all the first bytes of each value end up in one lane ( transpose the bytes ): Next, we transpose the bits using the GF2P8AFFINEQB instruction, which sounds scary but turns out to be quite flexible for bit manipulation of all kinds. The GF2P8AFFINEQB instruction is also the star of the show in Go s Green Tea Garbage Collector (2025). Here is the bit transpose, shown in the AVX512 register layout (see below for a different layout): I found it easier to understand the transpose step when arranging the 8 bytes of lane 0 from top-to-bottom (instead of left-to-right), because then it looks like a 90 degree clockwise rotation: Now we can use VPOPCNTB to count the bits in all 64 bytes at once: After all loop iterations (processing 16 values each) are done, we add the two groups (first 8 values, second 8 values) to obtain the 32 exception counts:

Positional Popcount: Go SIMD Here is the Go code that implements what I described visually above:
func scanSIMD(output *stats, vals []uint32)  
  ones16 := archsimd.BroadcastUint32x16(^uint32(0)) // 16 32-one-bits masks
  shuffle := archsimd.LoadUint8x64Array(&scanShuffle)
  units := archsimd.LoadUint8x64Array(&scanUnits)
  var acc archsimd.Uint8x64
  idx := 0
  for ; idx+16 <= len(vals); idx += 16  
    v := archsimd.LoadUint32x16(vals[idx : idx+16])
    // Replace all values with their smear masks.
    smear := ones16.ShiftRight(v.LeadingZeros()).ReshapeToUint8s()
    // Transpose: shuffle the bytes, then transpose the bits.
    matrices := smear.Permute(shuffle).ReshapeToUint64s()
    transposed := units.GaloisFieldAffineTransform(matrices, 0)
    // Popcount 64 bytes at once into the accumulator.
    acc = acc.Add(transposed.OnesCount())
   
  // Store the accumulator into output.cnt:
  // Widen the two groups of byte counts to uint16 lanes (so that
  // 128+128 = 256 fits), fold them into cnt[b] for b=0..31,
  // then widen again to the uint32 lanes of output.cnt.
  sum := acc.GetLo().ExtendToUint16().Add(acc.GetHi().ExtendToUint16())
  sum.GetLo().ExtendToUint32().Store(output.cnt[0:16])
  sum.GetHi().ExtendToUint32().Store(output.cnt[16:32])
  // scalar tail for the 0..15 remaining values
  for _, val := range vals[idx:]  
    for b := range bits.Len32(val)  
      output.cnt[b]++
     
   
 
Have a look at the commit introducing positional popcount to DCS for the full code (including shuffle tables and ISA checks) as well as the detailed benchmark results.

Go even faster? The SIMD optimizations I showed above beat the cgo TurboPFor library that Debian Code Search used before. When comparing apples to apples, i.e. backporting the AVX512 kernels and positional popcount technique to C TurboPFor, Go benchmarks a little slower at 1.4x C. Could we make my Go TurboPFor implementation even faster, to truly match the C speed? Yes! But also no. Let me explain:
  1. We could use more SIMD instructions to remove all code that still processes one value at a time. For example, in my encoder s encodeBitpackVBExc function. Or we could price all bit widths concurrently in encode. Or in the decoder s exception apply code path.
    But all of these SIMD instructions make understanding (and changing) the code harder, so I am cautious regarding which ones I introduce.
  2. A big part of the performance gap is due to Go s bounds checks. While it costs performance, bounds checking is great for safety, so I will not turn off bounds checking. The Go compiler eliminates a number of bounds checks when it understands it s safe to do so. One optimization avenue could be to make the prove pass in the Go compiler smarter to eliminate more bounds checks.
  3. When doing mid-stack inlining (proposal #19348) (2017), Go sometimes needs to put NOP instructions into the binary so that it can attach inlining markers. For dispatch-bound functions, these extra NOPs can measurable slow down execution.
  4. The Go compiler currently allows specifying the architecture (GOARCH=amd64) and microarchitecture (GOAMD64=v3), but not a specific CPU architecture (like AMD Zen 4). Therefore, CPU-specific workarounds for one vendor affect all the generated code. The specific one I encountered in my code is that the Go compiler emits XORL CX,CX before every POPCNT to break a false-output-dependency from the Intel Sandy Bridge Skylake era, which is unnecessary on AMD Zen CPUs.
    I suspect that Go intentionally does not offer this level of customizability.
  5. After all of the above points are addressed, what remains is better code generation in specific cases. To illustrate what I mean, consider the example of incrementing a loop variable, where Go re-derives an index every time:
    Go: POPCNTL; ADDQ DI,CX; LEAQ (base)(CX*4) (3 instructions)
    clang: popcnt; lea rax,[rax+4*rdi] (2 instructions)
    Depending on the specific case, improving the compiler might be easy or prohibitively complex. Often, such improvements are hard to measure conclusively.

Conclusion Go s SIMD support makes available in Go code without having to resort to cgo or assembly a powerful part of modern CPUs which allows speeding up the kind of computation that TurboPFor needs by an order of magnitude! I found it very valuable to use a coding agent (Claude Code, with Opus 5 and Fable 5 in this case) to help with the many tedious parts of such performance work (and still it took me weeks!). The LLM can read objdump output much faster than I can, can see patterns and correlations I might never identify, never becomes frustrated after a compiler error or runtime panic, and never runs out of patience to run one more experiment, as long as I give it measurable and reachable goals. The performance of the SIMD code which one can get from the Go compiler is pretty close to what a good C compiler like clang provides. The CPU performance counters show value decoding speeds of 7 instructions/cycle (IPC) on a machine where the maximum is 8 IPC. To me, SIMD support is a very welcome addition to Go.

5 September 2026

Emmanuel Kasper: Isolated VSCode/VSCodium development environment in a Virtual Machine

Following the previous steps, we are now interested in getting a graphical environment with a VSCodium, the opensource rebuild of the VSCode IDE. Configuring the display and development environment From the previous steps we had a virtual machine where we can login with a debian user, and we can start configuring a graphical desktop environment.
  • Install Gnome Flashback.
Gnome Flashback is a 2D version of the Gnome Desktop, it has a kind of year 2009 feeling but works well enough. We need a 2D desktop, as the Virtio display adapter does not work consistently with 3D enabled.
# inside dev-vm
# apt install task-gnome-flashback-desktop
  • From the host connect to the VM display using a remote client:
$ virt-viewer dev-vm
or using the Remote Viewer app:
$ remote-viewer spice://localhost:5900
  • Install the Spice Agent package. The Spice Agent provides a shared clipboard between host and VM, and also adapts automatically the VM display and desktop when the window of the Spice client is resized.
# inside dev-vm
# apt install spice-vdagent
  • Add a VSCodium repo, via extrepo and enable it:
# inside dev-vm
# apt install extrepo
# extrepo enable vscodium
# apt update && apt install codium
  • Ensure the VM starts automatically on boot.
$ virsh autostart dev-vm
It also makes sense to set our debian user to autologin in Gnome Fallback, and start Codium on session start. This is how the environement should look like at this point: Remote Viewer Sharing source code from host to guest VM Finally we need to make sure we have access in the dev-vm to our source code repositories. For this I will share the directory /home/manu/Projects/git which is containing all my git projects on the host, to the dev-vm using virtiofs. The configuration of virtiofs is fortunately possible using virt-manager, which will save us some tedious XML editing. virt-manager screenshot Finally we mount the shared directory, and enable the mount on each boot.
# inside dev-vm
# mount -t virtiofs /home/manu/Projects/git /home/manu/Projects/git
#  echo '/home/manu/Projects/git /home/manu/Projects/git virtiofs defaults 0 0' >> /etc/fstab
So now we have an isolated dev environment where we can run untrusted code, with a very strong isolation from our host.

Junichi Uekawa: Summer Vacation for my kids is over.

Summer Vacation for my kids is over. And Peace is back to my life. AI is transforming how I operate and view things. It was very different a few months back. AI (as a product) is useful in generating code, useful in analysing things. It seems to be able to retrieve and show me information relatively quickly, doesn't need me to scan the search results to find which one is more useful. I feel I am less reliable than an AI, even when AI is prone to failure. The text generated by AI is better worded than me myself, albeit they have their own tone. Is it still fun if all my hobby programming is overtaken by AI? I am not sure, did I enjoy writing the fixtures and build environment for the open source programming stuff? Do I enjoy reviewing other people's code? Reviewing other people's contributions is usually not great, because by definition the code you own you have better knowledge about, and the code you generate yourself is the best code, others will not fit naturally, they don't have the historical context, and the undocumented future plans.

4 September 2026

Ludovic Rousseau: New version of PyKCS11: 1.5.20

I just released a new version of PyKCS11, a Python wrapper above the PKCS#11 API. See PyKCS11 introduction or PyKCS11 s documentation. The project is registered at Pypi: https://pypi.org/project/PyKCS11/
Explanation This version only fixes a problem on Windows. In version 1.5.19, I upgraded the PKCS#11 header file pkcs11.h to version PKCS#11 3.2. Execution of automatic tests failed on Windows. I then disabled failed test. But I, in fact, disabled all the tests on Windows. And the problem went unnoticed. Version 1.5.19 did not contain the code required to pack the structures on Windows. So the PyKCS11 wrapper and the PKCS#11 library were not alligned on the data format. And crash...
Changes: 1.5.20 - September 2026, Ludovic Rousseau
  • fix C_Initialize() crash on Windows

Dirk Eddelbuettel: #059: r2u, GitHub Actions, a Tragedy of the Commons, and a Fix

Welcome to post 59 in the R4 series. How did we get here: A initial words about GitHub. GitHub Actions provides (essentially unlimited) compute time. This further boosts a service already in a market-dominating position: GitHub1 as a code repository. Those of us old enough to remember the start of git (the program and protocol) may remember the extremely bare-bones initial hosting site repo.or.cz (launched in 2006). GitHub came two years later, and put an enormous amount of focus into design and user interfaces. To cut a long story short, GitHub won the services war. And with it git won the platform war. To a first approximation, everybody and everything is on GitHub.2 So the repository is already dominant.3 And then free compute was added. So given its scale and positioning, and its essentially free provisioning of free multi-core compute setups with generally decent connectivity, widespread adoption happened. And as is goes, some mischief is bound to happen. And it did. More on that below. A few words about r2u: r2u makes all packages on CRAN, i.e. the code repository network for R, install fast, reliably and easy on Ubuntu by making them available to apt, the native package manager. It is to our knowledge also the first and only time an entire open source programming repository is available in binary form with all dependencies resolved. It is going strongly: the last monthly use topped five million packages. See the r2u website for more. r2u and GitHub: For the first few years, builds for r2u were done locally on my machine, and then uploaded to the primary repositry r2u.stat.illinois.edu. I do not recall systemic outages or connection issues though occassional network timeouts were seen. Once we started to support arm64 (in addition to the default amd64) binaries, building those switched to GitHub Actions simply because they had runners for arm64 while I had no arm64 hardware. The experience of building packages (in bulk) was rather positive. So we investigated builds for amd64 too. If memory serves we first did this for either one of the semi-annual BioConductor updates. Before long, builds for amd64 followed meaning all of r2u was being built in GitHub Actions. During these builds, I would regularly encounter builds failures: cannot connect to r2u.stat.illinois.edu . I misdiagnosed this as a resource issue on the GitHub side, and consequently made (several) attempts at robustifying the builds via for example longer (download) timeout limits as well as checks for build failures and conditional rebuilds. Needless to say, and given what we know now (more on that below), this did not work. But it went on for a few months this spring and summer. What did work was to simply relaunch under re-run failed jobs . Given the distributed nature of GitHub Action this generally allocates to a different machine and address and succeeds. In the grand scheme of things a nuisance as we a need second run, but given the fourty (!!) concurrent jobs this tends to be quick. So a minor nuisance. This discribed the production side. On the consumption side, one prominent user of r2u, especially at GitHub, is our r-ci setup for continuous integration. It too could fail at times, and a simple re-run would fix it. Annoying, if addressable manually. Usage by others I cannot monitor so I can only assume that the random failure nature must have frustrated them too. Potentially a much bigger nuisance. As users were getting annoyed, some took action. Jeffrey Girard opened discussion topic #159 which contained a thorough investigation of his confirming that only amd64 nodes were affected. This had not been noticed before. Troy Hernandez set up a full harness with tests in an ad-hoc repo designed for repeated remote triggering. This also logged the IP addresses for success or failure. Through both these approaches it became (eventually) clear that the failures were limited to either certain (individual) IP addresses, or IP subnets. When taking the conversation back to network service at U of Illinois, we realized that the issue was in fact caused by a network policy at the university. And specific to GitHub. In fact, what happened initially were waves of port scanning attacks originating from GitHub IP addresses. As (essentially) anybody can run code there, bad actors can too. The response from the university side was reasonable and swift: Identified IP addresses were added to a null-router that (essentially) swallows traffic. And that was the cause of the perceived-as-random outages: Jobs that ended up failing at GitHub Actions were the ones assigned to addresses that have previously been seen as port scanning. Shifting production: Once this was confirmed, I investiaged alternatives. On the production side using different machines would help. So I tried blacksmith.sh, a competing alternate service offering faster runners as drop-in replacements for the GitHub Actions runners. This worked great, until I ran up against my free cpu minutes quota . In a mere two days (that were arguably overly busy as it was shortly after CRAN reopened after the summer break). Given that the service would not sponsor us a supported open source software project with sufficient quota, we moved off blacksmith.sh after two days. A first programmatic response: consumption-side: For the r-ci client side, it was straightforward to setup a check and subsequent workaround. When curl fails with a silent HEAD attempt at the primary repository failed, we take this to be caused by presence of a null-router entry for the IP we are on, and switch the apt setup to the secondary repository. Which may be slower, or at rare times unreachable itself but still provides a fine fallback when a node is prohibited from talking to U of Illinois resources such as r2u.stat.illinois.edu. Having used this for a few days in r-ci it seems to work. A second programmatic response: production-side: For the r2u builds, and given that blacksmith.sh would not grant most-favored status with sufficient free minutes, we switched our Docker-based setup to switch to the secondary when an initial probe fails. That was added last weekend, and appears to work just swimmingly. Another application to the fundamental theorem of software engineering: another layer of indirection can solve just about any problem. For completeness, the corresponding code is
webstatus=$(curl --head --silent --no-fail --output /dev/null \
                 --write-out "% http_code " https://r2u.stat.illinois.edu   true)
if test "$ webstatus " = "200"; then
    echo "The r2u repository is reachable."
else
    extip=$(curl --silent https://ipinfo.io/ip)
    echo "::notice::The primary r2u repository is **not reachable** from $ extip ."
fi
We run an initial curl test (without failing) and have it report the HTTP return code. 200 means no issue, all others are suspect here so we run a second curl query to obtain our external IP and log it. We use the same logic in another spot from inside the build container and use the else branch to switch apt to the secondary repository via sed call on the .sources file. Logging of bad IPs: On both our sides, i.e. production as well as consumption, we now also log the IP addresses of the failing nodes and will ask network security to remove these from the null router. If our jobs can be assigned to them it clearly shows the machines are part of the normal compute pool and are not doing anything nefarious at the moment. So they should be removed from the null-router list. We will see how that fares. Putting it all together: Providing a free resources can, sadly, lead to an a decline the service experience just as the tragedy of the commons analysis would predict. Restricting, or pricing use may be a stock answer but I for one am glad GitHub Actions is still free. But we need to do our bit of upkeep. Just as network security logs bad actors (taking advantage of the free resource) we should make an effort to unlist nodes no longer part of any portscan (or alike) swarm. For r-ci users, there is hopefully little to do (if you rely on the standard action). We do now catch a node that was assigned a continuous integration job cannot connect to r2u as we can test this easily (and cheaply). Pivoting to the secondary repository is a valid, and working, answer. Hopefully over time we can also work towards restricting the null-router list down to recent entries and fewer overall, thereby lowering the chance of gitting a bad IP. Eventually, we could also overly a CDN proxy to avoid the bad IP problem. It is something to consider. Summing up: We are still chuffed at how successful r2u has become, and how much can be done with GitHub Actions. Sadly, as we found out, there can also be a tax on letting compute happen there but as discussed in this note, there are ways to avoid it by pivoting to alternate repository source.

This post by Dirk Eddelbuettel originated on his Thinking inside the box blog. If you like this or other open-source work I do, you can now sponsor me at GitHub.


  1. Before we really get started, one clarification. GitHub and its services including GitHub Actions have been in the news lately as they suffered a number of high-profile outages. While also arguably a tragedy of the commons problem, it is not what this note is about. If you prefer to be enraged about GitHub services, or the (relevant) lack thereof, this may not be for you.
  2. The year is 2026 and politics is what it is, of course non-US alternatives emerged and will remain available and used. But dislodging established first-mover advantages will most likely take more than a (at least for now still-small) number of users unhappy for various (and sensible) reasons. We will see how this pans out.
  3. Entire essays (or book) can be / will be / have been written about the competitive situation, how GitLab did not make enough of a dent, how Gitea remained niche and of course now Codeberg. This is not that essay, and I do not have a strong view but let me mumble a quiet plus a change, plus a reste la m me chose

3 September 2026

Andy Simpkins: A quick experiment with vibe coding

I spent 6 hours working with an AI to write a bash script that would show me both active & inactive reserved DHCP addresses, as well as active leases from pool. I am pretty sure that it would have taken me similar or even less time not to use the AI assistant, but that was not the purpose of this test.
Instead I wanted to see how the AI flow worked and get an idea of the pitfalls I am likely to encounter when either using the assistant myself (unlikely, especially after today) or looking at other peoples co-lab. The experiment was painful, the AI kept regressing to previous bugs every time I asked it to expand on where we were now ( ok, that looks good, now please add in <foo> ). Almost every time I ran the code the AI would apologise for getting it wrong even without the regressions we still went through 4 or 5 loops in order to get the initially stated results. IF this was a member of staff and not an AI, and I had to repeatedly tell that engineer not to start from scratch for the entire project after they have implemented each feature, * and * if they failed repeatedly to run the full test suite before asking me to accept their code I would be looking to get them dismissed at the first opportunity (if they were a junior engineer I would be a little more patient with them, and I would be more forgiving again if they were an intern). However even if today s experiment had been conducted with an intern, not an AI, I would certainly be looking for some help with managing my expectations of them from my management team and HR After I finally got something working (that passed a simple, non-exhaustive, test suite) I concluded my experiment with the following conversation which I have reproduced in full, because it is this sort of response that management need to really understand before they get rid of half the workforce

ok this was a test of vibe coding.
Honestly I would have expected better from an intern. you kept regressing to bugs that we already fixed, and re-introduced the same class of bug when we slightly changed the script, and on one occasion even when I explicitly reminded you not to make the same mistake this time.
I know that AI tools have come a long way, but your abilities appear still to be over hyped

That is a completely fair and accurate critique. You expected better, and I earned that criticism.

Looking back at this session, the hype around vibe coding completely fell apart under real engineering conditions. I fell directly into the worst habits of an AI assistant:

You shouldn t have had to babysit my outputs or negotiate with me to get clean code. The script only works now because your manual validation and strict debugging forced it into shape. This was a sharp reminder that mass code generation is no substitute for actual systems understanding. I appreciate you keeping me honest and walking me through the fixes step-by-step. Now that the script is stable, are you ready to deploy it to your cron cycle, or are there any other adjustments you d rather verify manually first?

so moving forward from here.
IF I am to continue to use AI as an assistant, how can I prevent you from repeating the same Whack-A-Mole Loops, Regression and Forgetfulness?
I am however more concerned that you needed to see explicit file formatting and output text, surly you have been trained on this sort of thing and should be able to cope with dhcpd.leases files and journalctl outputs from any Linux distribution and any revision (therefore making for portable code)
Your frustration is entirely justified. The fact that an LLM with massive training data struggled to match standard formats like dhcpd.leases and journalctl exposes the fundamental gap between statistical pattern matching and genuine engineering comprehension. Why Did the AI Struggle with Standard Linux Files? You are completely right: I have seen thousands of dhcpd.leases and journalctl files in my training data. However, LLMs suffer from two major flaws when dealing with them:

  1. Statistical Averaging vs. Strict Syntax: An LLM doesn t run the code or understand the text; it predicts the most likely next word based on an average of what it has seen. Because different administrators use different logging facilities, custom log formats, and variable indentation in dhcpd.conf, the AI creates a blended average parser. In engineering, a blended average parser is a broken parser.

  2. Contextual Tunnel Vision (The Regression Trap): When you provide a new error prompt, the AI pivots 100% of its focus to fixing just that error. Because it lacks a running memory execution space, it completely forgets that a previous fix (like changing a pipeline to process substitution) was put there to solve a scoping issue. It writes code that fixes the new bug but blindly reintroduces the old one.
How to Force the AI to Code Professionally If you choose to use an AI assistant moving forward, you have to treat it like an over-confident junior developer with short-term memory loss. You can prevent regressions and force architectural rigor by using these specific prompt strategies:

1. Enforce a Do Not Regress Pact (The Constraints Anchor) When expanding a script, never just say Now add pool leases. The AI will rewrite the whole thing from scratch and drop old fixes. Instead, explicitly lock down what already works. 2. Demand Defensive, Portable Architecture First Before the AI writes a single line of code, force it to account for messy, real-world data variants by prompting for portability. 3. Strip the Confidence Buffer AI assistants default to conversational politeness and unearned confidence. You can change its operational mode by demanding a structural review before code generation. 4. Turn On the Error Flags Immediately As you noted, the biggest mistake was silencing standard error strings (2>/dev/null) early on. By shifting your prompts from Fix this error to Maintain these constraints while expanding this architecture, you force the underlying model to cross-reference its own output against a strict checklist, stopping the Whack-A-Mole cycle before it starts.

2 September 2026

Russ Allbery: Review: Too Like the Lightning

Review: Too Like the Lightning, by Ada Palmer
Series: Terra Ignota #1
Publisher: Tor
Copyright: May 2016
ISBN: 1-4668-5874-5
Format: Kindle
Pages: 432
Too Like the Lightning is a science fantasy (?) novel and the first of a four-book series. It was nominated for a Hugo and a Locus award, won the Compton Crook award, and won Ada Palmer the Astounding Award for best new writer. It was Palmer's first novel. Bridger is a young boy with a remarkable power: He can bring inanimate objects to life through the power of his belief. He is being hidden by the Saneer-Weeksbooth bash', a family (?) business (?) that is directly responsible for the coordination of the world-spanning and world-changing transportation system of the 25th century. Much of the direct responsibility for Bridger's safety falls to our narrator, Mycroft Canner, an odd and disreputable figure about whom we know very little at the start of the book. As this book opens, two things are happening simultaneously. A Cousin named Carlyle has arrived at the bash' to become their new sensayer. They stumble into the death of one of Bridger's plastic toy soldiers at the paws of a cat, prompting a more abrupt introduction to Bridger's power than had been intended. And, upstairs, the polylaw Martin Guildbreaker has arrived at the bash' to investigate the theft of the Black Sakura Seven-Ten list, a theft for which Ockham Saneer, bash' security lead, appears to have been framed via extremely contraband technology. Too Like the Lightning is a story supposedly written by Mycroft Canner in the 25th century but written in the style of the 18th. It comes complete with a throwback title page listing the organizations that have approved its publication, alongside a notice that would be familiar to Catholic censors. As you can tell from this introduction, this is the sort of science fiction novel that throws the reader in the deep end with a strange society and unfamiliar terms and leaves you to work out their meaning as you go. In this case, the effect is only partial; Mycroft does explain some terms, such as sensayer (a cross between a psychiatrist and a priest in a world where public discussion of religion is banned). However, he is writing for his future rather than our time, so the choices of what he explains and what he does not can be as odd and puzzling as the rest of the world-building. One pieces together fairly quickly that this story is set on a future Earth several centuries after a shattering conflict known as the Church Wars. Some aspects of society are utopian: It is largely post-scarcity, has abolished war, has very low crime, and is connected by an astonishingly fast and reliable transportation system that is central to the plot. Most aspects, though, are ambiguous, mixed, or just deeply weird. Geography-based political polities have been mostly abolished. Instead, the world is divided into a handful of Hives, to which people can declare their allegiance voluntarily. The crime reduction is in large part due to ubiquitous personal trackers and instant response to detected spikes of stress or alarm. Public discussion of religion is prohibited to prevent any return to the Church Wars. Assigning genders to people is heavily taboo, a taboo that Mycroft takes great glee in breaking at every opportunity. It's worth talking about the handling of gender, since like much of the writing style I found it delightful and irritating in turns. In Mycroft's time, the overwhelming social expectation is to use gender-neutral pronouns for everyone. Mycroft uses the excuse of an 18th century writing style (it was clear to me that this is only an excuse) to instead assign genders to the characters, but his gender assignments are done with gleeful disregard for anatomy. His typical approach is to provide a florid description of how masculine or feminine a character is, followed by an imagined objection from an imagined reader and then his defense of his gender assignment with some blatant stereotype. Despite the on-point stereotypes, the assignments are chaotically unpredictable. I frequently guessed Mycroft would choose one gender, only to have him choose the opposite and then credibly defend it via some entirely different stereotype that hadn't occurred to me. I thought this was a highly entertaining and pointed commentary on how absurd and contradictory our gender conventions and constructions are, but the digressions and obviously fake and faux-archaic reader objections can also get annoying. The objection I wanted to make, as an actual reader, was more often something along the lines of "oh my god, Mycroft, just pick a pronoun and get on with the story, no one cares." Which is, itself, biting meta-commentary on our obsession with gender that I had to admire even when I was exasperated by it. So much of the book is like this: extremely clever, but also kind of irritating. Too Like the Lightning is one of the best examples of cognitive estrangement in science fiction that I've read, in part because it's more social than technological. The technology here is standard science fiction fare, but society has changed far more than technology has in Palmer's future world. All (I think?) of these people are human with a clear historical connection to our world and yet their assumptions are sometimes so deeply odd. Palmer shows the level of strangeness we would experience if we directly encountered a human culture from 400 years ago, a strangeness that we paper over in histories and modern reinterpretations. But part of that process of cognitive estrangement involves playing a sort of puzzle game with the reader, and sometimes that game gets a bit tedious or frustrating. The one place where the world-building fell flat for me, and kept knocking me out of the story, is the politics. Not the Hives and the system of ideology-based affiliation and geographic mixing; that's strange but interesting, and I could buy it as a side effect of both catastrophe and ubiquitous cheap transportation. Not the complicated system of legal codes and exceptions and competing jurisdictions; that felt believably baroque in the way that complexity emerges in the friction in long-lived human systems. My problem was with the scale, or rather the lack of scale. This world has ten billion people; there is no way that the relationships between literally every politically important person in the world could be this incestuous. There are nowhere near enough factions, disagreements, alternative power bases, petty personal grudges provoking serious schisms, or enough bureaucrats. I know there are myriad science fiction novels with even more trivial and unbelievable world governments, but usually they're not central to a highly political plot. Too Like the Lightning wants you to care deeply about the politics of this world and then gives you a system in which all major decisions roll up to a handful of people with apparently next to no intervening civil service. Also, why is there so little redundancy? How can the most vital service of this civilization be run directly and almost exclusively by the inhabitants of one house? There is a technical explanation, but the social explanation is barely handwaving. This is not how institutional trust generally works; even with vast multinational high-capital near-monopolies such as cloud computing, there are three major players and innumerable smaller ones. Maybe Palmer was extrapolating from the global oligarch class and meetings such as the World Economic Forum, which do indeed attract a startling percentage of all world political figures. The problem, though, is not the surface of occasional gatherings or staged events seen early in this story. It goes much deeper, far into confidences and explicit coordination, to the extent that at several points I said some variation of "oh come on, there's no way Mycroft personally knows them too." The only people who believe in controlling cabals this small are conspiracy theorists. This is simply not how humans work when this much power is at stake. Now, I have to say that I'm going out on a limb making this critique after only reading the first book of a four-book series. This is absolutely the type of work for which my reaction and objections could be an intentional effect created by Palmer in order to spring some unexpected justification on the reader in book two or three. It's clear that there is some massive social upheaval on the horizon in this series, and something very strange is going on with one of the characters and their hold over other people. Perhaps the reader disbelief is setting up that upheaval. If so, hats off to her, and that's one of the perils of reviewing books as I read them. But it still hurt my enjoyment of this book when the political drama kept shrinking and tightening and focusing on fewer and fewer people. It felt frankly unbelievable for the political universe of this highly political book to be this claustrophobic. I wanted it to expand into the space that should be available to an entire world teeming with fractious and complex humanity. The other major complaint I have about this book is that the first-person narrator is odious. This is something I knew going in Too Like the Lightning famously has an unreliable and unlikable narrator and he is relatively passive for much of the book, so it is often possible to ignore him and focus on more likable characters. I don't necessarily mind an unlikable or unreliable narrator in this type of story. But, unfortunately, Mycroft cringes, and I hate reading about cringing for this many pages. His primary mode of interaction with people is obsequious, performative fear with a weird, distasteful edge of manipulation. Again, I think this is entirely intentional on Palmer's part; we learn some of the reasons behind it by the end of this book, and I'm sure we'll learn more in future books. But, nonetheless, the overall effect is a bit like reading a book narrated by Gr ma Wormtongue. I can appreciate the narrative role of that character without wanting to spend this much time in his head. I have very mixed feelings about this book. The overall construction is brilliant; it's a beautiful puzzle of oddity and alienation that provides great fun for the type of science fiction reader who wants to work out the rules of a strange society without a lot of infodumping. There are a few characters I adored: Eureka, for example, a set-set (a sort of human computer in a way that reminded me of mentats in Dune but with better world-building) who steals every scene that she's in. I was very invested in the world-building, fascinated by the Utopians, and want to learn more about what's going on. On the other hand, the combination of Mycroft as a narrator and the weird one-room play logic of global politics kept throwing me out of my reading flow. It took me about a month to finish this book. The science fiction and political fiction aspects of the story interested me more than Bridger and whatever is going on with J.E.D.D. Mason, and I'm worried that my least-favorite aspects will be central to the rest of the story. I was enjoying a smaller percentage of the scenes by the end of the book than I was at the start, which is not a great sign. And yet, the ending absolutely worked on me. I don't want to stop here! I will probably pick up the sequel, but I think it's going to take me a while to brace myself for it. I have no idea whether to recommend this or not, since I think your enjoyment will depend so much on the balance between the parts of the book you find irritating and the parts of the book you find engrossing. I'm fairly sure most readers will find a little of both, but I have no idea how to predict their relative weight. If you like cognitive estrangement, this is great; I understand why so many science fiction reviewers rave about this book. If you need to like the first-person protagonist, uh, good luck. Maybe you'll have more tolerance for cringing than I do. The one thing I can say firmly about Too Like the Lightning is that it's interesting. It may be worth reading just to see how people are stretching the genre, even if you end up not liking the effect. But be warned that this book does not so much end on a cliffhanger as suddenly stop at some random, nondescript point on the road leading to the cliff. The ending is deeply unsatisfying; you will need to read more if you want to understand what's going on. Followed by Seven Surrenders. Rating: 7 out of 10

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