mimalloc (pronounced "me-malloc") is a general purpose allocator with excellent performance characteristics. Initially developed by Daan Leijen for the runtime systems of the Koka and Lean languages.

Latest release tag: v2.1.7 (2024-05-21).
Latest v1 tag: v1.8.7 (2024-05-21).

mimalloc is a drop-in replacement for malloc and can be used in other programs without code changes, for example, on dynamically linked ELF-based systems (Linux, BSD, etc.) you can use it as:

> LD_PRELOAD=/usr/lib/libmimalloc.so  myprogram

It also includes a robust way to override the default allocator in Windows. Notable aspects of the design include:

• small and consistent: the library is about 8k LOC using simple and consistent data structures. This makes it very suitable to integrate and adapt in other projects. For runtime systems it provides hooks for a monotonic heartbeat and deferred freeing (for bounded worst-case times with reference counting). Partly due to its simplicity, mimalloc has been ported to many systems (Windows, macOS, Linux, WASM, various BSD's, Haiku, MUSL, etc) and has excellent support for dynamic overriding. At the same time, it is an industrial strength allocator that runs (very) large scale distributed services on thousands of machines with excellent worst case latencies.
• free list sharding: instead of one big free list (per size class) we have many smaller lists per "mimalloc page" which reduces fragmentation and increases locality -- things that are allocated close in time get allocated close in memory. (A mimalloc page contains blocks of one size class and is usually 64KiB on a 64-bit system).
• free list multi-sharding: the big idea! Not only do we shard the free list per mimalloc page, but for each page we have multiple free lists. In particular, there is one list for thread-local free operations, and another one for concurrent free operations. Free-ing from another thread can now be a single CAS without needing sophisticated coordination between threads. Since there will be thousands of separate free lists, contention is naturally distributed over the heap, and the chance of contending on a single location will be low -- this is quite similar to randomized algorithms like skip lists where adding a random oracle removes the need for a more complex algorithm.
• eager page purging: when a "page" becomes empty (with increased chance due to free list sharding) the memory is marked to the OS as unused (reset or decommitted) reducing (real) memory pressure and fragmentation, especially in long running programs.
• secure: mimalloc can be built in secure mode, adding guard pages, randomized allocation, encrypted free lists, etc. to protect against various heap vulnerabilities. The performance penalty is usually around 10% on average over our benchmarks.
• first-class heaps: efficiently create and use multiple heaps to allocate across different regions. A heap can be destroyed at once instead of deallocating each object separately.
• bounded: it does not suffer from blowup [1], has bounded worst-case allocation times (wcat) (upto OS primitives), bounded space overhead (~0.2% meta-data, with low internal fragmentation), and has no internal points of contention using only atomic operations.
• fast: In our benchmarks (see below), mimalloc outperforms other leading allocators (jemalloc, tcmalloc, Hoard, etc), and often uses less memory. A nice property is that it does consistently well over a wide range of benchmarks. There is also good huge OS page support for larger server programs.

The documentation gives a full overview of the API. You can read more on the design of mimalloc in the technical report which also has detailed benchmark results.

Enjoy!

• master: latest stable release (based on dev-slice).
• dev: development branch for mimalloc v1. Use this branch for submitting PR's.
• dev-slice: development branch for mimalloc v2. This branch is downstream of dev (and is essentially equal to dev except for src/segment.c)

Note: the v2.x version has a different algorithm for managing internal mimalloc pages (as slices) that tends to use reduce memory usage and fragmentation compared to mimalloc v1.x (especially for large workloads). Should otherwise have similar performance (see below); please report if you observe any significant performance regression.

• 2024-05-21, v1.8.7, v2.1.7: Fix build issues on less common platforms. Started upstreaming patches from the CPython integration. Upstream vcpkg patches.

• 2024-05-13, v1.8.6, v2.1.6: Fix build errors on various (older) platforms. Refactored aligned allocation.

• 2024-04-22, v1.8.4, v2.1.4: Fixes various bugs and build issues. Add MI_LIBC_MUSL cmake flag for musl builds. Free-ing code is refactored into a separate module (free.c). Mimalloc page info is simplified with the block size directly available (and new block_size_shift to improve aligned block free-ing). New approach to collection of abandoned segments: When a thread terminates the segments it owns are abandoned (containing still live objects) and these can be reclaimed by other threads. We no longer use a list of abandoned segments but this is now done using bitmaps in arena's which is more concurrent (and more aggressive). Abandoned memory can now also be reclaimed if a thread frees an object in an abandoned page (which can be disabled using mi_option_abandoned_reclaim_on_free). The option mi_option_max_segment_reclaim gives a maximum percentage of abandoned segments that can be reclaimed per try (=10%).

• 2023-04-24, v1.8.2, v2.1.2: Fixes build issues on freeBSD, musl, and C17 (UE 5.1.1). Reduce code size/complexity by removing regions and segment-cache's and only use arenas with improved memory purging -- this may improve memory usage as well for larger services. Renamed options for consistency. Improved Valgrind and ASAN checking.

• 2023-04-03, v1.8.1, v2.1.1: Fixes build issues on some platforms.

• 2023-03-29, v1.8.0, v2.1.0: Improved support dynamic overriding on Windows 11. Improved tracing precision with asan and Valgrind, and added Windows event tracing ETW (contributed by Xinglong He). Created an OS abstraction layer to make it easier to port and separate platform dependent code (in src/prim). Fixed C++ STL compilation on older Microsoft C++ compilers, and various small bug fixes.

• 2022-12-23, v1.7.9, v2.0.9: Supports building with asan and improved Valgrind support. Support arbitrary large alignments (in particular for std::pmr pools). Added C++ STL allocators attached to a specific heap (thanks @vmarkovtsev). Heap walks now visit all object (including huge objects). Support Windows nano server containers (by Johannes Schindelin,@dscho). Various small bug fixes.

• 2022-11-03, v1.7.7, v2.0.7: Initial support for Valgrind for leak testing and heap block overflow detection. Initial support for attaching heaps to a speficic memory area (only in v2). Fix realloc behavior for zero size blocks, remove restriction to integral multiple of the alignment in alloc_align, improved aligned allocation performance, reduced contention with many threads on few processors (thank you @dposluns!), vs2022 support, support pkg-config, .

• 2022-04-14, v1.7.6, v2.0.6: fix fallback path for aligned OS allocation on Windows, improve Windows aligned allocation even when compiling with older SDK's, fix dynamic overriding on macOS Monterey, fix MSVC C++ dynamic overriding, fix warnings under Clang 14, improve performance if many OS threads are created and destroyed, fix statistics for large object allocations, using MIMALLOC_VERBOSE=1 has no maximum on the number of error messages, various small fixes.

• 2022-02-14, v1.7.5, v2.0.5 (alpha): fix malloc override on Windows 11, fix compilation with musl, potentially reduced committed memory, add bin/minject for Windows, improved wasm support, faster aligned allocation, various small fixes.

• Older release notes

Special thanks to:

• David Carlier (@devnexen) for his many contributions, and making mimalloc work better on many less common operating systems, like Haiku, Dragonfly, etc.
• Mary Feofanova (@mary3000), Evgeniy Moiseenko, and Manuel Pöter (@mpoeter) for making mimalloc TSAN checkable, and finding memory model bugs using the genMC model checker.
• Weipeng Liu (@pongba), Zhuowei Li, Junhua Wang, and Jakub Szymanski, for their early support of mimalloc and deployment at large scale services, leading to many improvements in the mimalloc algorithms for large workloads.
• Jason Gibson (@jasongibson) for exhaustive testing on large scale workloads and server environments, and finding complex bugs in (early versions of) mimalloc.
• Manuel Pöter (@mpoeter) and Sam Gross(@colesbury) for finding an ABA concurrency issue in abandoned segment reclamation. Sam also created the no GIL Python fork which uses mimalloc internally.

mimalloc is used in various large scale low-latency services and programs, for example:

Open ide/vs2022/mimalloc.sln in Visual Studio 2022 and build. The mimalloc project builds a static library (in out/msvc-x64), while the mimalloc-override project builds a DLL for overriding malloc in the entire program.

We use cmake¹ as the build system:

> mkdir -p out/release
> cd out/release
> cmake ../..
> make

This builds the library as a shared (dynamic) library (.so or .dylib), a static library (.a), and as a single object file (.o).

> sudo make install (install the library and header files in /usr/local/lib and /usr/local/include)

You can build the debug version which does many internal checks and maintains detailed statistics as:

> mkdir -p out/debug
> cd out/debug
> cmake -DCMAKE_BUILD_TYPE=Debug ../..
> make

This will name the shared library as libmimalloc-debug.so.

Finally, you can build a secure version that uses guard pages, encrypted free lists, etc., as:

> mkdir -p out/secure
> cd out/secure
> cmake -DMI_SECURE=ON ../..
> make

This will name the shared library as libmimalloc-secure.so. Use cmake ../.. -LH to see all the available build options.

The examples use the default compiler. If you like to use another, use:

> CC=clang CXX=clang++ cmake ../..

You can also use cmake on Windows. Open a Visual Studio development prompt and invoke cmake with the right generator and architecture, like:

> cmake ..\.. -G "Visual Studio 17 2022" -A x64 -DMI_OVERRIDE=ON

The cmake build type is specified when actually building, for example:

> cmake --build . --config=Release

You can also directly build the single src/static.c file as part of your project without needing cmake at all. Make sure to also add the mimalloc include directory to the include path.

The preferred usage is including <mimalloc.h>, linking with the shared- or static library, and using the mi_malloc API exclusively for allocation. For example,

> gcc -o myprogram -lmimalloc myfile.c

mimalloc uses only safe OS calls (mmap and VirtualAlloc) and can co-exist with other allocators linked to the same program. If you use cmake, you can simply use:

find_package(mimalloc 1.4 REQUIRED)

in your CMakeLists.txt to find a locally installed mimalloc. Then use either:

target_link_libraries(myapp PUBLIC mimalloc)

to link with the shared (dynamic) library, or:

target_link_libraries(myapp PUBLIC mimalloc-static)

to link with the static library. See test\CMakeLists.txt for an example.

For best performance in C++ programs, it is also recommended to override the global new and delete operators. For convenience, mimalloc provides mimalloc-new-delete.h which does this for you -- just include it in a single(!) source file in your project. In C++, mimalloc also provides the mi_stl_allocator struct which implements the std::allocator interface.

You can pass environment variables to print verbose messages (MIMALLOC_VERBOSE=1) and statistics (MIMALLOC_SHOW_STATS=1) (in the debug version):

> env MIMALLOC_SHOW_STATS=1 ./cfrac 175451865205073170563711388363

175451865205073170563711388363 = 374456281610909315237213 * 468551

heap stats:     peak      total      freed       unit
normal   2:    16.4 kb    17.5 mb    17.5 mb      16 b   ok
normal   3:    16.3 kb    15.2 mb    15.2 mb      24 b   ok
normal   4:      64 b      4.6 kb     4.6 kb      32 b   ok
normal   5:      80 b    118.4 kb   118.4 kb      40 b   ok
normal   6:      48 b       48 b       48 b       48 b   ok
normal  17:     960 b      960 b      960 b      320 b   ok

heap stats:     peak      total      freed       unit
    normal:    33.9 kb    32.8 mb    32.8 mb       1 b   ok
      huge:       0 b        0 b        0 b        1 b   ok
     total:    33.9 kb    32.8 mb    32.8 mb       1 b   ok
malloc requested:         32.8 mb

 committed:    58.2 kb    58.2 kb    58.2 kb       1 b   ok
  reserved:     2.0 mb     2.0 mb     2.0 mb       1 b   ok
     reset:       0 b        0 b        0 b        1 b   ok
  segments:       1          1          1
-abandoned:       0
     pages:       6          6          6
-abandoned:       0
     mmaps:       3
 mmap fast:       0
 mmap slow:       1
   threads:       0
   elapsed:     2.022s
   process: user: 1.781s, system: 0.016s, faults: 756, reclaims: 0, rss: 2.7 mb

The above model of using the mi_ prefixed API is not always possible though in existing programs that already use the standard malloc interface, and another option is to override the standard malloc interface completely and redirect all calls to the mimalloc library instead .

You can set further options either programmatically (using mi_option_set), or via environment variables:

• MIMALLOC_SHOW_STATS=1: show statistics when the program terminates.
• MIMALLOC_VERBOSE=1: show verbose messages.
• MIMALLOC_SHOW_ERRORS=1: show error and warning messages.

Advanced options:

• MIMALLOC_ARENA_EAGER_COMMIT=2: turns on eager commit for the large arenas (usually 1GiB) from which mimalloc allocates segments and pages. Set this to 2 (default) to only enable this on overcommit systems (e.g. Linux). Set this to 1 to enable explicitly on other systems as well (like Windows or macOS) which may improve performance (as the whole arena is committed at once). Note that eager commit only increases the commit but not the actual the peak resident set (rss) so it is generally ok to enable this.
• MIMALLOC_PURGE_DELAY=N: the delay in N milli-seconds (by default 10) after which mimalloc will purge OS pages that are not in use. This signals to the OS that the underlying physical memory can be reused which can reduce memory fragmentation especially in long running (server) programs. Setting N to 0 purges immediately when a page becomes unused which can improve memory usage but also decreases performance. Setting N to a higher value like 100 can improve performance (sometimes by a lot) at the cost of potentially using more memory at times. Setting it to -1 disables purging completely.
• MIMALLOC_PURGE_DECOMMITS=1: By default "purging" memory means unused memory is decommitted (MEM_DECOMMIT on Windows, MADV_DONTNEED (which decresease rss immediately) on mmap systems). Set this to 0 to instead "reset" unused memory on a purge (MEM_RESET on Windows, generally MADV_FREE (which does not decrease rss immediately) on mmap systems). Mimalloc generally does not "free" OS memory but only "purges" OS memory, in other words, it tries to keep virtual address ranges and decommits within those ranges (to make the underlying physical memory available to other processes).

Further options for large workloads and services:

• MIMALLOC_USE_NUMA_NODES=N: pretend there are at most N NUMA nodes. If not set, the actual NUMA nodes are detected at runtime. Setting N to 1 may avoid problems in some virtual environments. Also, setting it to a lower number than the actual NUMA nodes is fine and will only cause threads to potentially allocate more memory across actual NUMA nodes (but this can happen in any case as NUMA local allocation is always a best effort but not guaranteed).
• MIMALLOC_ALLOW_LARGE_OS_PAGES=1: use large OS pages (2 or 4MiB) when available; for some workloads this can significantly improve performance. When this option is disabled, it also disables transparent huge pages (THP) for the process (on Linux and Android). Use MIMALLOC_VERBOSE to check if the large OS pages are enabled -- usually one needs to explicitly give permissions for large OS pages (as on Windows and Linux). However, sometimes the OS is very slow to reserve contiguous physical memory for large OS pages so use with care on systems that can have fragmented memory (for that reason, we generally recommend to use MIMALLOC_RESERVE_HUGE_OS_PAGES instead whenever possible).
• MIMALLOC_RESERVE_HUGE_OS_PAGES=N: where N is the number of 1GiB huge OS pages. This reserves the huge pages at startup and sometimes this can give a large (latency) performance improvement on big workloads. Usually it is better to not use MIMALLOC_ALLOW_LARGE_OS_PAGES=1 in combination with this setting. Just like large OS pages, use with care as reserving contiguous physical memory can take a long time when memory is fragmented (but reserving the huge pages is done at startup only once). Note that we usually need to explicitly give permission for huge OS pages (as on Windows and Linux)). With huge OS pages, it may be beneficial to set the setting MIMALLOC_EAGER_COMMIT_DELAY=N (N is 1 by default) to delay the initial N segments (of 4MiB) of a thread to not allocate in the huge OS pages; this prevents threads that are short lived and allocate just a little to take up space in the huge OS page area (which cannot be purged as huge OS pages are pinned to physical memory). The huge pages are usually allocated evenly among NUMA nodes. We can use MIMALLOC_RESERVE_HUGE_OS_PAGES_AT=N where N is the numa node (starting at 0) to allocate all the huge pages at a specific numa node instead.

Use caution when using fork in combination with either large or huge OS pages: on a fork, the OS uses copy-on-write for all pages in the original process including the huge OS pages. When any memory is now written in that area, the OS will copy the entire 1GiB huge page (or 2MiB large page) which can cause the memory usage to grow in large increments.

mimalloc can be build in secure mode by using the -DMI_SECURE=ON flags in cmake. This build enables various mitigations to make mimalloc more robust against exploits. In particular:

• All internal mimalloc pages are surrounded by guard pages and the heap metadata is behind a guard page as well (so a buffer overflow exploit cannot reach into the metadata).
• All free list pointers are encoded with per-page keys which is used both to prevent overwrites with a known pointer, as well as to detect heap corruption.
• Double free's are detected (and ignored).
• The free lists are initialized in a random order and allocation randomly chooses between extension and reuse within a page to mitigate against attacks that rely on a predicable allocation order. Similarly, the larger heap blocks allocated by mimalloc from the OS are also address randomized.

As always, evaluate with care as part of an overall security strategy as all of the above are mitigations but not guarantees.

When mimalloc is built using debug mode, various checks are done at runtime to catch development errors.

• Statistics are maintained in detail for each object size. They can be shown using MIMALLOC_SHOW_STATS=1 at runtime.
• All objects have padding at the end to detect (byte precise) heap block overflows.
• Double free's, and freeing invalid heap pointers are detected.
• Corrupted free-lists and some forms of use-after-free are detected.

Overriding the standard malloc (and new) can be done either dynamically or statically.

This is the recommended way to override the standard malloc interface.

On these ELF-based systems we preload the mimalloc shared library so all calls to the standard malloc interface are resolved to the mimalloc library.

> env LD_PRELOAD=/usr/lib/libmimalloc.so myprogram

You can set extra environment variables to check that mimalloc is running, like:

> env MIMALLOC_VERBOSE=1 LD_PRELOAD=/usr/lib/libmimalloc.so myprogram

or run with the debug version to get detailed statistics:

> env MIMALLOC_SHOW_STATS=1 LD_PRELOAD=/usr/lib/libmimalloc-debug.so myprogram

On macOS we can also preload the mimalloc shared library so all calls to the standard malloc interface are resolved to the mimalloc library.

> env DYLD_INSERT_LIBRARIES=/usr/lib/libmimalloc.dylib myprogram

Note that certain security restrictions may apply when doing this from the shell.

Dynamically overriding on mimalloc on Windows is robust and has the particular advantage to be able to redirect all malloc/free calls that go through the (dynamic) C runtime allocator, including those from other DLL's or libraries. As it intercepts all allocation calls on a low level, it can be used reliably on large programs that include other 3rd party components. There are four requirements to make the overriding work well:

1. Use the C-runtime library as a DLL (using the /MD or /MDd switch).

2. Link your program explicitly with the mimalloc.lib export library for the mimalloc.dll. (which must be compiled with -DMI_OVERRIDE=ON, which is the default though). To ensure the mimalloc.dll is actually loaded at run-time it is easiest to insert some call to the mimalloc API in the main function, like mi_version() (or use the /include:mi_version switch on the linker command, or similarly, #pragma comment(linker, "/include:mi_version") in some source file). See the mimalloc-test-override project for an example on how to use this.

3. The mimalloc-redirect.dll must be put in the same folder as the main mimalloc.dll at runtime (as it is a dependency of that DLL). The redirection DLL ensures that all calls to the C runtime malloc API get redirected to mimalloc functions (which reside in mimalloc.dll).

4. Ensure the mimalloc.dll comes as early as possible in the import list of the final executable (so it can intercept all potential allocations). You can use minject -l <exe> to check this if needed.

For best performance on Windows with C++, it is also recommended to also override the new/delete operations (by including mimalloc-new-delete.h a single(!) source file in your project).

The environment variable MIMALLOC_DISABLE_REDIRECT=1 can be used to disable dynamic overriding at run-time. Use MIMALLOC_VERBOSE=1 to check if mimalloc was successfully redirected.

For different platforms than x64, you may need a specific redirection dll. Furthermore, we cannot always re-link an executable or ensure mimalloc.dll comes first in the import table. In such cases the minject tool can be used to patch the executable's import tables.

On Unix-like systems, you can also statically link with mimalloc to override the standard malloc interface. The recommended way is to link the final program with the mimalloc single object file (mimalloc.o). We use an object file instead of a library file as linkers give preference to that over archives to resolve symbols. To ensure that the standard malloc interface resolves to the mimalloc library, link it as the first object file. For example:

> gcc -o myprogram mimalloc.o  myfile1.c ...

Another way to override statically that works on all platforms, is to link statically to mimalloc (as shown in the introduction) and include a header file in each source file that re-defines malloc etc. to mi_malloc. This is provided by mimalloc-override.h. This only works reliably though if all sources are under your control or otherwise mixing of pointers from different heaps may occur!

Generally, we recommend using the standard allocator with memory tracking tools, but mimalloc can also be build to support the address sanitizer or the excellent Valgrind tool. Moreover, it can be build to support Windows event tracing (ETW). This has a small performance overhead but does allow detecting memory leaks and byte-precise buffer overflows directly on final executables. See also the test/test-wrong.c file to test with various tools.

To build with valgrind support, use the MI_TRACK_VALGRIND=ON cmake option:

> cmake ../.. -DMI_TRACK_VALGRIND=ON

This can also be combined with secure mode or debug mode. You can then run your programs directly under valgrind:

> valgrind <myprogram>

If you rely on overriding malloc/free by mimalloc (instead of using the mi_malloc/mi_free API directly), you also need to tell valgrind to not intercept those calls itself, and use:

> MIMALLOC_SHOW_STATS=1 valgrind  --soname-synonyms=somalloc=*mimalloc* -- <myprogram>

By setting the MIMALLOC_SHOW_STATS environment variable you can check that mimalloc is indeed used and not the standard allocator. Even though the Valgrind option is called --soname-synonyms, this also works when overriding with a static library or object file. Unfortunately, it is not possible to dynamically override mimalloc using LD_PRELOAD together with valgrind. See also the test/test-wrong.c file to test with valgrind.

Valgrind support is in its initial development -- please report any issues.

To build with the address sanitizer, use the -DMI_TRACK_ASAN=ON cmake option:

> cmake ../.. -DMI_TRACK_ASAN=ON

This can also be combined with secure mode or debug mode. You can then run your programs as:'

> ASAN_OPTIONS=verbosity=1 <myprogram>

When you link a program with an address sanitizer build of mimalloc, you should generally compile that program too with the address sanitizer enabled. For example, assuming you build mimalloc in out/debug:

clang -g -o test-wrong -Iinclude test/test-wrong.c out/debug/libmimalloc-asan-debug.a -lpthread -fsanitize=address -fsanitize-recover=address

Since the address sanitizer redirects the standard allocation functions, on some platforms (macOSX for example) it is required to compile mimalloc with -DMI_OVERRIDE=OFF. Adress sanitizer support is in its initial development -- please report any issues.

Event tracing for Windows (ETW) provides a high performance way to capture all allocations though mimalloc and analyze them later. To build with ETW support, use the -DMI_TRACK_ETW=ON cmake option.

You can then capture an allocation trace using the Windows performance recorder (WPR), using the src/prim/windows/etw-mimalloc.wprp profile. In an admin prompt, you can use:

> wpr -start src\prim\windows\etw-mimalloc.wprp -filemode
> <my_mimalloc_program>
> wpr -stop <my_mimalloc_program>.etl

and then open <my_mimalloc_program>.etl in the Windows Performance Analyzer (WPA), or use a tool like TraceControl that is specialized for analyzing mimalloc traces.

Last update: 2021-01-30

We tested mimalloc against many other top allocators over a wide range of benchmarks, ranging from various real world programs to synthetic benchmarks that see how the allocator behaves under more extreme circumstances. In our benchmark suite, mimalloc outperforms other leading allocators (jemalloc, tcmalloc, Hoard, etc), and has a similar memory footprint. A nice property is that it does consistently well over the wide range of benchmarks.

General memory allocators are interesting as there exists no algorithm that is optimal -- for a given allocator one can usually construct a workload where it does not do so well. The goal is thus to find an allocation strategy that performs well over a wide range of benchmarks without suffering from (too much) underperformance in less common situations.

As always, interpret these results with care since some benchmarks test synthetic or uncommon situations that may never apply to your workloads. For example, most allocators do not do well on xmalloc-testN but that includes even the best industrial allocators like jemalloc and tcmalloc that are used in some of the world's largest systems (like Chrome or FreeBSD).

Also, the benchmarks here do not measure the behaviour on very large and long-running server workloads, or worst-case latencies of allocation. Much work has gone into mimalloc to work well on such workloads (for example, to reduce virtual memory fragmentation on long-running services) but such optimizations are not always reflected in the current benchmark suite.

We show here only an overview -- for more specific details and further benchmarks we refer to the technical report. The benchmark suite is automated and available separately as mimalloc-bench.

Testing on the 16-core AMD 5950x processor at 3.4Ghz (4.9Ghz boost), with with 32GiB memory at 3600Mhz, running Ubuntu 20.04 with glibc 2.31 and GCC 9.3.0.

We measure three versions of mimalloc: the main version mi (tag:v1.7.0), the new v2.0 beta version as xmi (tag:v2.0.0), and the main version in secure mode as smi (tag:v1.7.0).

The other allocators are Google's tcmalloc (tc, tag:gperftools-2.8.1) used in Chrome, Facebook's jemalloc (je, tag:5.2.1) by Jason Evans used in Firefox and FreeBSD, the Intel thread building blocks allocator (tbb, tag:v2020.3), rpmalloc (rp,tag:1.4.1) by Mattias Jansson, the original scalable Hoard (git:d880f72) allocator by Emery Berger [1], the memory compacting Mesh (git:67ff31a) allocator by Bobby Powers et al [8], and finally the default system allocator (glibc, 2.31) (based on PtMalloc2).

Any benchmarks ending in N run on all 32 logical cores in parallel. Results are averaged over 10 runs and reported relative to mimalloc (where 1.2 means it took 1.2× longer to run). The legend also contains the overall relative score between the allocators where 100 points is the maximum if an allocator is fastest on all benchmarks.

The single threaded cfrac benchmark by Dave Barrett is an implementation of continued fraction factorization which uses many small short-lived allocations. All allocators do well on such common usage, where mimalloc is just a tad faster than tcmalloc and jemalloc.

The leanN program is interesting as a large realistic and concurrent workload of the Lean theorem prover compiling its own standard library, and there is a 13% speedup over tcmalloc. This is quite significant: if Lean spends 20% of its time in the allocator that means that mimalloc is 1.6× faster than tcmalloc here. (This is surprising as that is not measured in a pure allocation benchmark like alloc-test. We conjecture that we see this outsized improvement here because mimalloc has better locality in the allocation which improves performance for the other computations in a program as well).

The single threaded redis benchmark again show that most allocators do well on such workloads.

The larsonN server benchmark by Larson and Krishnan [2] allocates and frees between threads. They observed this behavior (which they call bleeding) in actual server applications, and the benchmark simulates this. Here, mimalloc is quite a bit faster than tcmalloc and jemalloc probably due to the object migration between different threads.

The mstressN workload performs many allocations and re-allocations, and migrates objects between threads (as in larsonN). However, it also creates and destroys the N worker threads a few times keeping some objects alive beyond the life time of the allocating thread. We observed this behavior in many larger server applications.

The rptestN benchmark by Mattias Jansson is a allocator test originally designed for rpmalloc, and tries to simulate realistic allocation patterns over multiple threads. Here the differences between allocators become more apparent.

The second benchmark set tests specific aspects of the allocators and shows even more extreme differences between them.

The alloc-test, by OLogN Technologies AG, is a very allocation intensive benchmark doing millions of allocations in various size classes. The test is scaled such that when an allocator performs almost identically on alloc-test1 as alloc-testN it means that it scales linearly.

The sh6bench and sh8bench benchmarks are developed by MicroQuill as part of SmartHeap. In sh6bench mimalloc does much better than the others (more than 2.5× faster than jemalloc). We cannot explain this well but believe it is caused in part by the "reverse" free-ing pattern in sh6bench. The sh8bench is a variation with object migration between threads; whereas tcmalloc did well on sh6bench, the addition of object migration causes it to be 10× slower than before.

The xmalloc-testN benchmark by Lever and Boreham [5] and Christian Eder, simulates an asymmetric workload where some threads only allocate, and others only free -- they observed this pattern in larger server applications. Here we see that the mimalloc technique of having non-contended sharded thread free lists pays off as it outperforms others by a very large margin. Only rpmalloc, tbb, and glibc also scale well on this benchmark.

The cache-scratch benchmark by Emery Berger [1], and introduced with the Hoard allocator to test for passive-false sharing of cache lines. With a single thread they all perform the same, but when running with multiple threads the potential allocator induced false sharing of the cache lines can cause large run-time differences. Crundal [6] describes in detail why the false cache line sharing occurs in the tcmalloc design, and also discusses how this can be avoided with some small implementation changes. Only the tbb, rpmalloc and mesh allocators also avoid the cache line sharing completely, while Hoard and glibc seem to mitigate the effects. Kukanov and Voss [7] describe in detail how the design of tbb avoids the false cache line sharing.

For completeness, here are the results on a big Amazon c5.18xlarge instance consisting of a 2×18-core Intel Xeon (Cascade Lake) at 3.4GHz (boost 3.5GHz) with 144GiB ECC memory, running Ubuntu 20.04 with glibc 2.31, GCC 9.3.0, and Clang 10.0.0. This time, the mimalloc allocators (mi, xmi, and smi) were compiled with the Clang compiler instead of GCC. The results are similar to the AMD results but it is interesting to see the differences in the larsonN, mstressN, and xmalloc-testN benchmarks.

The following figure shows the peak working set (rss) of the allocators on the benchmarks (on the c5.18xlarge instance).

Note that the xmalloc-testN memory usage should be disregarded as it allocates more the faster the program runs. Similarly, memory usage of larsonN, mstressN, rptestN and sh8bench can vary depending on scheduling and speed. Nevertheless, we hope to improve the memory usage on mstressN and rptestN (just as cfrac, larsonN and sh8bench have a small working set which skews the results).

• [1] Emery D. Berger, Kathryn S. McKinley, Robert D. Blumofe, and Paul R. Wilson. Hoard: A Scalable Memory Allocator for Multithreaded Applications the Ninth International Conference on Architectural Support for Programming Languages and Operating Systems (ASPLOS-IX). Cambridge, MA, November 2000. pdf

• [2] P. Larson and M. Krishnan. Memory allocation for long-running server applications. In ISMM, Vancouver, B.C., Canada, 1998. pdf

• [3] D. Grunwald, B. Zorn, and R. Henderson. Improving the cache locality of memory allocation. In R. Cartwright, editor, Proceedings of the Conference on Programming Language Design and Implementation, pages 177–186, New York, NY, USA, June 1993. pdf

• [4] J. Barnes and P. Hut. A hierarchical O(n*log(n)) force-calculation algorithm. Nature, 324:446-449, 1986.

• [5] C. Lever, and D. Boreham. Malloc() Performance in a Multithreaded Linux Environment. In USENIX Annual Technical Conference, Freenix Session. San Diego, CA. Jun. 2000. Available at https://github.com/kuszmaul/SuperMalloc/tree/master/tests

• [6] Timothy Crundal. Reducing Active-False Sharing in TCMalloc. 2016. CS16S1 project at the Australian National University. pdf

• [7] Alexey Kukanov, and Michael J Voss. The Foundations for Scalable Multi-Core Software in Intel Threading Building Blocks. Intel Technology Journal 11 (4). 2007

• [8] Bobby Powers, David Tench, Emery D. Berger, and Andrew McGregor. Mesh: Compacting Memory Management for C/C++ In Proceedings of the 40th ACM SIGPLAN Conference on Programming Language Design and Implementation (PLDI'19), June 2019, pages 333-–346.

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• 2021-11-14, v1.7.3, v2.0.3 (beta): improved WASM support, improved macOS support and performance (including M1), improved performance for v2 for large objects, Python integration improvements, more standard installation directories, various small fixes.

• 2021-06-17, v1.7.2, v2.0.2 (beta): support M1, better installation layout on Linux, fix thread_id on Android, prefer 2-6TiB area for aligned allocation to work better on pre-windows 8, various small fixes.

• 2021-04-06, v1.7.1, v2.0.1 (beta): fix bug in arena allocation for huge pages, improved aslr on large allocations, initial M1 support (still experimental).

• 2021-01-31, v2.0.0: beta release 2.0: new slice algorithm for managing internal mimalloc pages.

• 2021-01-31, v1.7.0: stable release 1.7: support explicit user provided memory regions, more precise statistics, improve macOS overriding, initial support for Apple M1, improved DragonFly support, faster memcpy on Windows, various small fixes.

• 2020-09-24, v1.6.7: stable release 1.6: using standard C atomics, passing tsan testing, improved handling of failing to commit on Windows, add mi_process_info api call.

• 2020-08-06, v1.6.4: stable release 1.6: improved error recovery in low-memory situations, support for IllumOS and Haiku, NUMA support for Vista/XP, improved NUMA detection for AMD Ryzen, ubsan support.

• 2020-05-05, v1.6.3: stable release 1.6: improved behavior in out-of-memory situations, improved malloc zones on macOS, build PIC static libraries by default, add option to abort on out-of-memory, line buffered statistics.

• 2020-04-20, v1.6.2: stable release 1.6: fix compilation on Android, MingW, Raspberry, and Conda, stability fix for Windows 7, fix multiple mimalloc instances in one executable, fix strnlen overload, fix aligned debug padding.

• 2020-02-17, v1.6.1: stable release 1.6: minor updates (build with clang-cl, fix alignment issue for small objects).

• 2020-02-09, v1.6.0: stable release 1.6: fixed potential memory leak, improved overriding and thread local support on FreeBSD, NetBSD, DragonFly, and macOSX. New byte-precise heap block overflow detection in debug mode (besides the double-free detection and free-list corruption detection). Add nodiscard attribute to most allocation functions. Enable MIMALLOC_PAGE_RESET by default. New reclamation strategy for abandoned heap pages for better memory footprint.

• 2020-02-09, v1.5.0: stable release 1.5: improved free performance, small bug fixes.

• 2020-01-22, v1.4.0: stable release 1.4: improved performance for delayed OS page reset, more eager concurrent free, addition of STL allocator, fixed potential memory leak.

• 2020-01-15, v1.3.0: stable release 1.3: bug fixes, improved randomness and stronger free list encoding in secure mode.

• 2019-12-22, v1.2.2: stable release 1.2: minor updates.

• 2019-11-22, v1.2.0: stable release 1.2: bug fixes, improved secure mode (free list corruption checks, double free mitigation). Improved dynamic overriding on Windows.

• 2019-10-07, v1.1.0: stable release 1.1.

• 2019-09-01, v1.0.8: pre-release 8: more robust windows dynamic overriding, initial huge page support.

• 2019-08-10, v1.0.6: pre-release 6: various performance improvements.