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IRC, freenode, #hurd, 2011-04-12:

    <antrik> braunr: do you think the allocator you wrote for x15 could be used
      for gnumach? and would you be willing to mentor this? :-)
    <braunr> antrik: to be willing to isn't my current problem
    <braunr> antrik: and yes, I think my allocator can be used
    <braunr> it's a slab allocator after all, it only requires reap() and
      grow()
    <braunr> or mmap()/munmap() whatever you want to call it
    <braunr> a backend
    <braunr> antrik: although i've been having other ideas recently
    <braunr> that would have more impact on our usage patterns I think
    <antrik> mcsim: have you investigated how the zone allocator works and how
      it's hooked into the system yet?
    <braunr> mcsim: now let me give you a link
    <braunr> mcsim:
      http://git.sceen.net/rbraun/libbraunr.git/?a=blob;f=mem.c;h=330436e799f322949bfd9e2fedf0475660309946;hb=HEAD
    <braunr> mcsim: this is an implementation of the slab allocator i've been
      working on recently
    <braunr> mcsim: i haven't made it public because i reworked the per
      processor layer, and this part isn't complete yet
    <braunr> mcsim: you could use it as a reference for your project
    <mcsim> braunr: ok
    <braunr> it used to be close to the 2001 vmem paper
    <braunr> but after many tests, fragmentation and accounting issues have
      been found
    <braunr> so i rewrote it to be closer to the linux implementation (cache
      filling/draining in bukl transfers)
    <braunr> bulk*
    <braunr> they actually use the word draining in linux too :)
    <mcsim> antrik: not complete yet.
    <antrik> braunr: oh, it's unfinished? that's unfortunate...
    <braunr> antrik: only the per processor part
    <braunr> antrik: so it doesn't matter much for gnumach
    <braunr> and it's not difficult to set up
    <antrik> mcsim: hm, OK... but do you think you will have a fairly good
      understanding in the next couple of days?...
    <antrik> I'm asking because I'd really like to see a proposal a bit more
      specific than "I'll look into things..."
    <antrik> i.e. you should have an idea which things you will actually have
      to change to hook up a new allocator etc.
    <antrik> braunr: OK. will the interface remain unchanged, so it could be
      easily replaced with an improved implementation later?
    <braunr> the zone allocator in gnumach is a badly written bare object
      allocator actually, there aren't many things to understand about it
    <braunr> antrik: yes
    <antrik> great :-)
    <braunr> and the per processor part should be very close to the phys
      allocator sitting next to it
    <braunr> (with the slight difference that, as per cpu caches have variable
      sizes, they are allocated on the free path rather than on the allocation
      path)
    <braunr> this is a nice trick in the vmem paper i've kept in mind
    <braunr> and the interface also allows to set a "source" for caches
    <antrik> ah, good point... do you think we should replace the physmem
      allocator too? and if so, do it in one step, or one piece at a time?...
    <braunr> no
    <braunr> too many drivers currently depend on the physical allocator and
      the pmap module as they are
    <braunr> remember linux 2.0 drivers need a direct virtual to physical
      mapping
    <braunr> (especially true for dma mappings)
    <antrik> OK
    <braunr> the nice thing about having a configurable memory source is that
    <antrik> whot do you mean by "allocated on the free path"?
    <braunr> even if most caches will use the standard vm_kmem module as their
      backend
    <braunr> there is one exception in the vm_map module, allowing us to get
      rid of either a static limit, or specific allocation code
    <braunr> antrik: well, when you allocate a page, the allocator will lookup
      one in a per cpu cache
    <braunr> if it's empty, it fills the cache
    <braunr> (called pools in my implementations)
    <braunr> it then retries
    <braunr> the problem in the slab allocator is that per cpu caches have
      variable sizes
    <braunr> so per cpu pools are allocated from their own pools
    <braunr> (remember the magazine_xx caches in the output i showed you, this
      is the same thing)
    <braunr> but if you allocate them at allocation time, you could end up in
      an infinite loop
    <braunr> so, in the slab allocator, when a per cpu cache is empty, you just
      fall back to the slab layer
    <braunr> on the free path, when a per cpu cache doesn't exist, you allocate
      it from its own cache
    <braunr> this way you can't have an infinite loop
    <mcsim> antrik: I'll try, but I have exams now.
    <mcsim> As I understand amount of elements which could be allocated we
      determine by zone initialization. And at this time memory for zone is
      reserved. I'm going to change this. And make something similar to kmalloc
      and vmalloc (support for pages consecutive physically and virtually). And
      pages in zones consecutive always physically.
    <mcsim> Am I right?
    <braunr> mcsim: don't try to do that
    <mcsim> why?
    <braunr> mcsim: we just need a slab allocator with an interface close to
      the zone allocator
    <antrik> mcsim: IIRC the size of the complete zalloc map is fixed; but not
      the number of elements per zone
    <braunr> we don't need two allocators like kmalloc and vmalloc
    <braunr> actually we just need vmalloc
    <braunr> IIRC the limits are only present because the original developers
      wanted to track leaks
    <braunr> they assumed zones would be large enough, which isn't true any
      more today
    <braunr> but i didn't see any true reservation
    <braunr> antrik: i'm not sure i was clear enough about the "allocation of
      cpu caches on the free path"
    <braunr> antrik: for a better explanation, read the vmem paper ;)
    <antrik> braunr: you mean there is no fundamental reason why the zone map
      has a limited maximal size; and it was only put in to catch cases where
      something eats up all memory with kernel object creation?...
    <antrik> braunr: I think I got it now :-)
    <braunr> antrik: i'm pretty certin of it yes
    <antrik> I don't see though how it is related to what we were talking
      about...
    <braunr> 10:55 < braunr> and the per processor part should be very close to
      the phys allocator sitting next to it
    <braunr> the phys allocator doesn't have to use this trick
    <braunr> because pages have a fixed size, so per cpu caches all have the
      same size too
    <braunr> and the number of "caches", that is, physical segments, is limited
      and known at compile time
    <braunr> so having them statically allocated is possible
    <antrik> I see
    <braunr> it would actually be very difficult to have a phys allocator
      requiring dynamic allocation when the dynamic allocator isn't yet ready
    <antrik> hehe :-)
    <mcsim> total size of all zone allocations is limited to 12 MB. And is "was
      only put in to catch cases where something eats up all memory with kernel
      object creation?"
    <braunr> mcsim: ah right, there could be a kernel submap backing all the
      zones
    <braunr> but this can be increased too
    <braunr> submaps are kind of evil :/
    <antrik> mcsim: I think it's actually 32 MiB or something like that in the
      Debian version...
    <antrik> braunr: I'm not sure I ever fully understood what the zalloc map
      is... I looked through the code once, and I think I got a rough
      understading, but I was still pretty uncertain about some bits. and I
      don't remember the details anyways :-)
    <braunr> antrik: IIRC, it's a kernel submap
    <braunr> it's named kmem_map in x15
    <antrik> don't know what a submap is
    <braunr> submaps are vm_map objects
    <braunr> in a top vm_map, there are vm_map_entries
    <braunr> these entries usually point to vm_objects
    <braunr> (for the page cache)
    <braunr> but they can point to other maps too
    <braunr> the goal is to reduce fragmentation by isolating allocations
    <braunr> this also helps reducing contention
    <braunr> for exemple, on BSD, there is a submap for mbufs, so that the
      network code doesn't interfere too much with other kernel allocations
    <braunr> antrik: they are similar to spans in vmem, but vmem has an elegant
      importing mechanism which eliminates the static limit problem
    <antrik> so memory is not directly allocated from the physical allocator,
      but instead from another map which in turn contains physical memory, or
      something like that?...
    <braunr> no, this is entirely virtual
    <braunr> submaps are almost exclusively used for the kernel_map
    <antrik> you are using a lot of identifies here, but I don't remember (or
      never knew) what most of them mean :-(
    <braunr> sorry :)
    <braunr> the kernel map is the vm_map used to represent the ~1 GiB of
      virtual memory the kernel has (on i386)
    <braunr> vm_map objects are simple virtual space maps
    <braunr> they contain what you see in linux when doing /proc/self/maps
    <braunr> cat /proc/self/maps
    <braunr> (linux uses entirely different names but it's roughly the same
      structure)
    <braunr> each line is a vm_map_entry
    <braunr> (well, there aren't submaps in linux though)
    <braunr> the pmap tool on netbsd is able to show the kernel map with its
      submaps, but i don't have any image around
    <mcsim> braunr: is limit for zones is feature and shouldn't be changed?
    <braunr> mcsim: i think we shouldn't have fixed limits for zones
    <braunr> mcsim: this should be part of the debugging facilities in the slab
      allocator
    <braunr> is this fixed limit really a major problem ?
    <braunr> i mean, don't focus on that too much, there are other issues
      requiring more attention
    <antrik> braunr: at 12 MiB, it used to be, causing a lot of zalloc
      panics. after increasing, I don't think it's much of a problem anymore...
    <antrik> but as memory sizes grow, it might become one again
    <antrik> that's the problem with a fixed size...
    <braunr> yes, that's the issue with submaps
    <braunr> but gnumach is full of those, so let's fix them by order of
      priority
    <antrik> well, I'm still trying to digest what you wrote about submaps :-)
    <braunr> i'm downloading netbsd, so you can have a good view of all this
    <antrik> so, when the kernel allocates virtual address space regions
      (mostly for itself), instead of grabbing chunks of the address space
      directly, it takes parts out of a pre-reserved region?
    <braunr> not exactly
    <braunr> both statements are true
    <mcsim> antrik: only virtual addresses are reserved
    <braunr> it grabs chunks of the address space directly, but does so in a
      reserved region of the address space
    <braunr> a submap is like a normal map, it has a start address, a size, and
      is empty, then it's populated with vm_map_entries
    <braunr> so instead of allocating from 3-4 GiB, you allocate from, say,
      3.1-3.2 GiB
    <antrik> yeah, that's more or less what I meant...
    <mcsim> braunr: I see two problems: limited zones and absence of caching. 
    <mcsim> with caching absence of readahead paging will be not so significant
    <braunr> please avoid readahead
    <mcsim> ok
    <braunr> and it's not about paging, it's about kernel memory, which is
      wired
    <braunr> (well most of it)
    <braunr> what about limited zones ?
    <braunr> the whole kernel space is limited, there has to be limits
    <braunr> the problem is how to handle them
    <antrik> braunr: almost all. I looked through all zones once, and IIRC I
      found exactly one that actually allows paging...
    <braunr> currently, when you reach the limit, you have an OOM error
    <braunr> antrik: yes, there are
    <braunr> i don't remember which implementation does that but, when
      processes haven't been active for a minute or so, they are "swapedout"
    <braunr> completely
    <braunr> even the kernel stack
    <braunr> and the page tables
    <braunr> (most of the pmap structures are destroyed, some are retained)
    <antrik> that might very well be true... at least inactive processes often
      show up with 0 memory use in top on Hurd
    <braunr> this is done by having a pageable kernel map, with wired entries
    <braunr> when the swapper thread swaps tasks out, it unwires them
    <braunr> but i think modern implementations don't do that any more
    <antrik> well, I was talking about zalloc only :-)
    <braunr> oh
    <braunr> so the zalloc_map must be pageable
    <braunr> or there are two submaps ?
    <antrik> not sure whether "morden implementations" includes Linux ;-)
    <braunr> no, i'm talking about the bsd family only
    <antrik> but it's certainly true that on Linux even inactive processes
      retain some memory
    <braunr> linux doesn't make any difference between processor-bound and
      I/O-bound processes
    <antrik> braunr: I have no idea how it works. I just remember that when
      creating zones, one of the optional flags decides whether the zone is
      pagable. but as I said, IIRC there is exactly one that actually is...
    <braunr> zone_map = kmem_suballoc(kernel_map, &zone_min, &zone_max,
      zone_map_size, FALSE);
    <braunr> kmem_suballoc(parent, min, max, size, pageable)
    <braunr> so the zone_map isn't
    <antrik> IIRC my conclusion was that pagable zones do not count in the
      fixed zone map limit... but I'm not sure anymore
    <braunr> zinit() has a memtype parameter
    <braunr> with ZONE_PAGEABLE as a possible flag
    <braunr> this is wierd :)
    <mcsim> There is no any zones which use ZONE_PAGEABLE flag
    <antrik> mcsim: are you sure? I think I found one...
    <braunr> if (zone->type & ZONE_PAGEABLE) {
    <antrik> admittedly, it is several years ago that I looked into this, so my
      memory is rather dim...
    <braunr> if (kmem_alloc_pageable(zone_map, &addr, ...
    <braunr> calling kmem_alloc_pageable() on an unpageable submap seems wrong
    <mcsim> I've greped gnumach code and there is no any zinit procedure call
      with ZONE_PAGEABLE flag
    <braunr> good
    <antrik> hm... perhaps it was in some code that has been removed
      alltogether since ;-)
    <antrik> actually I think it would be pretty neat to have pageable kernel
      objects... but I guess it would require considerable effort to implement
      this right
    <braunr> mcsim: you also mentioned absence of caching
    <braunr> mcsim: the zone allocator actually is a bare caching object
      allocator
    <braunr> antrik: no, it's easy
    <braunr> antrik: i already had that in x15 0.1
    <braunr> antrik: the problem is being sure the objects you allocate from a
      pageable backing store are never used when resolving a page fault
    <braunr> that's all
    <antrik> I wouldn't expect that to be easy... but surely you know better
      :-)
    <mcsim> braunr: indeed. I was wrong.
    <antrik> braunr: what is a caching object allocator?...
    <braunr> antrik: ok, it's not easy
    <braunr> antrik: but once you have vm_objects implemented, having pageable
      kernel object is just a matter of using the right options, really
    <braunr> antrik: an allocator that caches its buffers
    <braunr> some years ago, the term "object" would also apply to
      preconstructed buffers
    <antrik> I have no idea what you mean by "caches its buffers" here :-)
    <braunr> well, a memory allocator which doesn't immediately free its
      buffers caches them
    <mcsim> braunr: but can it return objects to system?
    <braunr> mcsim: which one ?
    <antrik> yeah, obviously the *implementation* of pageable kernel objects is
      not hard. the tricky part is deciding which objects can be pageable, and
      which need to be wired...
    <mcsim> Can zone allocator return cached objects to system as in slab?
    <mcsim> I mean reap()
    <braunr> well yes, it does so, and it does that too often
    <braunr> the caching in the zone allocator is actually limited to the
      pagesize
    <braunr> once page is completely free, it is returned to the vm
    <mcsim> this is bad caching
    <braunr> yes
    <mcsim> if object takes all page than there is now caching at all
    <braunr> caching by side effect
    <braunr> true
    <braunr> but the linux slab allocator does the same thing :p
    <braunr> hm
    <braunr> no, the solaris slab allocator does so
    <mcsim> linux's slab returns objects only when system ask
    <antrik> without preconstructed objects, is there actually any point in
      caching empty slabs?...
    <mcsim> Once I've changed my allocator to slab and it cached more than 1GB
      of my memory)
    <braunr> ok wait, need to fix a few mistakes first
    <mcsim> s/ask/asks
    <braunr> the zone allocator (in gnumach) actually has a garbage collector
    <antrik> braunr: well, the Solaris allocator follows the slab/magazine
      paper, right? so there is caching at the magazine layer... in that case
      caching empty slabs too would be rather redundant I'd say...
    <braunr> which is called when running low on memory, similar to the slab
      allocaotr
    <braunr> antrik: yes
    <antrik> (or rather the paper follows the Solaris allocator ;-) )
    <braunr> mcsim: the zone allocator reap() is zone_gc()
    <antrik> braunr: hm, right, there is a "collectable" flag for zones... but
      I never understood what it means
    <antrik> braunr: BTW, I heard Linux has yet another allocator now called
      "slob"... do you happen to know what that is?
    <braunr> slob is a very simple allocator for embedded devices
    <mcsim> AFAIR this is just heap allocator
    <braunr> useful when you have a very low amount of memory
    <braunr> like 1 MiB
    <braunr> yes
    <antrik> just googled it :-)
    <braunr> zone and slab are very similar
    <antrik> sounds like a simple heap allocator
    <mcsim> there is another allocator that calls slub, and it better than slab
      in many cases
    <braunr> the main difference is the data structures used to store slabs
    <braunr> mcsim: i disagree
    <antrik> mcsim: ah, you already said that :-)
    <braunr> mcsim: slub is better for systems with very large amounts of
      memory and processors
    <braunr> otherwise, slab is better
    <braunr> in addition, there are accounting issues with slub
    <braunr> because of cache merging
    <mcsim> ok. This strange that slub is default allocator
    <braunr> well both are very good
    <braunr> iirc, linus stated that he really doesn't care as long as its
      works fine
    <braunr> he refused slqb because of that
    <braunr> slub is nice because it requires less memory than slab, while
      still being as fast for most cases
    <braunr> it gets slower on the free path, when the cpu performing the free
      is different from the one which allocated the object
    <braunr> that's a reasonable cost
    <mcsim> slub uses heap for large object. Are there any tests that compare
      what is better for large objects?
    <antrik> well, if slub requires less memory, why do you think slab is
      better for smaller systems? :-)
    <braunr> antrik: smaller is relative
    <antrik> mcsim: for large objects slab allocation is rather pointless, as
      you don't have multiple objects in a page anyways...
    <braunr> antrik: when lameter wrote slub, it was intended for systems with
      several hundreds processors
    <antrik> BTW, was slqb really refused only because the other ones are "good
      enough"?...
    <braunr> yes
    <antrik> wow, that's a strange argument...
    <braunr> linus is already unhappy of having "so many" allocators
    <antrik> well, if the new one is better, it could replace one of the others
      :-)
    <antrik> or is it useful only in certain cases?
    <braunr> that's the problem
    <braunr> nobody really knows
    <antrik> hm, OK... I guess that should be tested *before* merging ;-)
    <antrik> is anyone still working on it, or was it abandonned?
    <antrik> mcsim: back to caching...
    <antrik> what does caching in the kernel object allocator got to do with
      readahead (i.e. clustered paging)?...
    <mcsim> if we cached some physical pages we don't need to find new ones for
      allocating new object. And that's why there will not be a page fault.
    <mcsim> antrik: Regarding kam. Hasn't he finished his project?
    <antrik> err... what?
    <antrik> one of us must be seriously confused
    <antrik> I totally fail to see what caching of physical pages (which isn't
      even really a correct description of what slab does) has to do with page
      faults
    <antrik> right, KAM didn't finish his project
    <mcsim> If we free the physical page and return it to system we need
      another one for next allocation. But if we keep it, we don't need to find
      new physical page. 
    <mcsim> And physical page is allocated only then when page fault
      occurs. Probably, I'm wrong
    <antrik> what does "return to system" mean? we are talking about the
      kernel...
    <antrik> zalloc/slab are about allocating kernel objects. this doesn't have
      *anything* to do with paging of userspace processes
    <antrik> only thing the have in common is that they need to get pages from
      the physical page allocator. but that's yet another topic
    <mcsim> Under "return to system" I mean ability to use this page for other
      needs.
    <braunr> mcsim: consider kernel memory to be wired
    <braunr> here, return to system means releasing a page back to the vm
      system
    <braunr> the vm_kmem module then unmaps the physical page and free its
      virtual address in the kernel map
    <mcsim> ok
    <braunr> antrik: the problem with new allocators like slqb is that it's
      very difficult to really know if they're better, even with extensive
      testing
    <braunr> antrik: there are papers (like wilson95) about the difficulties in
      making valuable results in this field
    <braunr> see
      http://www.sceen.net/~rbraun/dynamic_storage_allocation_a_survey_and_critical_review.pdf
    <mcsim> how can be allocated physically continuous object now?
    <braunr> mcsim: rephrase please
    <mcsim> what is similar to kmalloc in Linux to gnumach?
    <braunr> i know memory is reserved for dma in a direct virtual to physical
      mapping
    <braunr> so even if the allocation is done similarly to vmalloc()
    <braunr> the selected region of virtual space maps physical memory, so
      memory is physically contiguous too
    <braunr> for other allocation types, a block large enough is allocated, so
      it's contiguous too
    <mcsim> I don't clearly understand. If we have fragmentation in physical
      ram, so there aren't 2 free pages in a row, but there are able apart, we
      can't to allocate these 2 pages along?
    <braunr> no
    <braunr> but every system has this problem
    <mcsim> But since we have only 12 or 32 MB of memory the problem becomes
      more significant
    <braunr> you're confusing virtual and physical memory
    <braunr> those 32 MiB are virtual
    <braunr> the physical pages backing them don't have to be contiguous
    <mcsim> Oh, indeed 
    <mcsim> So the only problem are limits?
    <braunr> and performance
    <braunr> and correctness
    <braunr> i find the zone allocator badly written
    <braunr> antrik: mcsim: here is the content of the kernel pmap on NetBSD
      (which uses a virtual memory system close to the Mach VM)
    <braunr> antrik: mcsim: http://www.sceen.net/~rbraun/pmap.out

[[pmap.out]]

    <braunr> you can see the kmem_map (which is used for most general kernel
      allocations) is 128 MiB large
    <braunr> actually it's not the kernel pmap, it's the kernel_map
    <antrik> braunr: why is it called pmap.out then? ;-)
    <braunr> antrik: because the tool is named pmap
    <braunr> for process map
    <braunr> it also exists under Linux, although direct access to
      /proc/xx/maps gives more info
    <mcsim> braunr: I've said that this is kernel_map. Can I see kernel_map for
      Linux?
    <braunr> mcsim: I don't know how to do that
    <mcsim> s/I've/You've
    <braunr> but Linux doesn't have submaps, and uses a direct virtual to
      physical mapping, so it's used differently
    <antrik> how are things (such as zalloc zones) entered into kernel_map?
    <braunr> in zone_init() you have
    <braunr> zone_map = kmem_suballoc(kernel_map, &zone_min, &zone_max,
      zone_map_size, FALSE);
    <braunr> so here, kmem_map is named zone_map
    <braunr> then, in zalloc()
    <braunr> kmem_alloc_wired(zone_map, &addr, zone->alloc_size)
    <antrik> so, kmem_alloc just deals out chunks of memory referenced directly
      by the address, and without knowing anything about the use?
    <braunr> kmem_alloc() gives virtual pages
    <braunr> zalloc() carves them into buffers, as in the slab allocator
    <braunr> the difference is essentially the lack of formal "slab" object
    <braunr> which makes the zone code look like a mess
    <antrik> so kmem_suballoc() essentially just takes a bunch of pages from
      the main kernel_map, and uses these to back another map which then in
      turn deals out pages just like the main kernel_map?
    <braunr> no
    <braunr> kmem_suballoc creates a vm_map_entry object, and sets its start
      and end address
    <braunr> and creates a vm_map object, which is then inserted in the new
      entry
    <braunr> maybe that's what you meant with "essentially just takes a bunch
      of pages from the main kernel_map"
    <braunr> but there really is no allocation at this point
    <braunr> except the map entry and the new map objects
    <antrik> well, I'm trying to understand how kmem_alloc() manages things. so
      it has map_entry structures like the maps of userspace processes? do
      these also reference actual memory objects?
    <braunr> kmem_alloc just allocates virtual pages from a vm_map, and backs
      those with physical pages (unless the user requested pageable memory)
    <braunr> it's not "like the maps of userspace processes"
    <braunr> these are actually the same structures
    <braunr> a vm_map_entry can reference a memory object or a kernel submap
    <braunr> in netbsd, it can also referernce nothing (for pure wired kernel
      memory like the vm_page array)
    <braunr> maybe it's the same in mach, i don't remember exactly
    <braunr> antrik: this is actually very clear in vm/vm_kern.c
    <braunr> kmem_alloc() creates a new kernel object for the allocation
    <braunr> allocates a new entry (or uses a previous existing one if it can
      be extended) through vm_map_find_entry()
    <braunr> then calls kmem_alloc_pages() to back it with wired memory
    <antrik> "creates a new kernel object" -- what kind of kernel object?
    <braunr> kmem_alloc_wired() does roughly the same thing, except it doesn't
      need a new kernel object because it knows the new area won't be pageable
    <braunr> a simple vm_object
    <braunr> used as a container for anonymous memory in case the pages are
      swapped out
    <antrik> vm_object is the same as memory object/pager? or yet something
      different?
    <braunr> antrik: almost
    <braunr> antrik: a memory_object is the user view of a vm_object
    <braunr> as in the kernel/user interfaces used by external pagers
    <braunr> vm_object is a more internal name
    <mcsim> Is fragmentation a big problem in slab allocator?
    <mcsim> I've tested it on my computer in Linux and for some caches it
      reached 30-40%
    <antrik> well, fragmentation is a major problem for any allocator...
    <antrik> the original slab allocator was design specifically with the goal
      of reducing fragmentation
    <antrik> the revised version with the addition of magazines takes a step
      back on this though
    <antrik> have you compared it to slub? would be pretty interesting...
    <mcsim> I have an idea how can it be decreased, but it will hurt by
      performance...
    <mcsim> antrik: no I haven't, but there will be might the same, I think
    <mcsim> if each cache will handle two types of object: with sizes that will
      fit cache sizes (or I bit smaller) and with sizes which are much smaller
      than maximal cache size. For first type of object will be used standard
      slab allocator and for latter type will be used (within page) heap
      allocator.
    <mcsim> I think that than fragmentation will be decreased
    <antrik> not at all. heap allocator has much worse fragmentation. that's
      why slab allocator was invented
    <antrik> the problem is that in a long-running program (such an the
      kernel), objects tend to have vastly varying lifespans
    <mcsim> but we use heap only for objects of specified sizes
    <antrik> so often a few old objects will keep a whole page hostage
    <mcsim> for example for 32 byte cache it could be 20-28 byte objects
    <antrik> that's particularily visible in programs such as firefox, which
      will grow the heap during use even though actual needs don't change
    <antrik> the slab allocator groups objects in a fashion that makes it more
      likely adjacent objects will be freed at similar times
    <antrik> well, that's pretty oversimplyfied, but I hope you get the
      idea... it's about locality
    <mcsim> I agree, but I speak not about general heap allocation. We have
      many heaps for objects with different sizes.
    <mcsim> Could it be better?
    <antrik> note that this has been a topic of considerable research. you
      shouldn't seek to improve the actual algorithms -- you would have to read
      up on the existing research at least before you can contribute anything
      to the field :-)
    <antrik> how would that be different from the slab allocator?
    <mcsim> slab will allocate 32 byte for both 20 and 32 byte requests
    <mcsim> And if there was request for 20 bytes we get 12 unused
    <antrik> oh, you mean the implementation of the generic allocator on top of
      slabs? well, that might not be optimal... but it's not an often used case
      anyways. mostly the kernel uses constant-sized objects, which get their
      own caches with custom tailored size
    <antrik> I don't think the waste here matters at all
    <mcsim> affirmative. So my idea is useless. 
    <antrik> does the statistic you refer to show the fragmentation in absolute
      sizes too?
    <mcsim> Can you explain what is absolute size?
    <mcsim> I've counted what were requested (as parameter of kmalloc) and what
      was really allocated (according to best fit cache size).
    <antrik> how did you get that information?
    <mcsim> I simply wrote a hook
    <antrik> I mean total. i.e. how many KiB or MiB are wasted due to
      fragmentation alltogether
    <antrik> ah, interesting. how does it work?
    <antrik> BTW, did you read the slab papers?
    <mcsim> Do you mean articles from lwn.net?
    <antrik> no 
    <antrik> I mean the papers from the Sun hackers who invented the slab
      allocator(s)
    <antrik> Bonwick mostly IIRC
    <mcsim> Yes
    <antrik> hm... then you really should know the rationale behind it...
    <mcsim> There he says about 11% percent of memory waste
    <antrik> you didn't answer my other questions BTW :-)
    <mcsim> I've corrupted kernel tree with patch, and tomorrow I'm going to
      read myself up for exam (I have it on Thursday). But than I'll send you a
      module which I've used for testing.
    <antrik> OK
    <mcsim> I can send you module now, but it will not work without patch.
    <mcsim> It would be better to rewrite it using debugfs, but when I was
      writing this test I didn't know about trace_* macros

2011-04-15

    <mcsim> There is a hack in zone_gc when it allocates and frees two
      vm_map_kentry_zone elements to make sure the gc will be able to allocate
      two in vm_map_delete. Isn't it better to allocate memory for these
      entries statically?
    <youpi> mcsim: that's not the point of the hack
    <youpi> mcsim: the point of the hack is to make sure vm_map_delete will be
      able to allocate stuff
    <youpi> allocating them statically will just work once
    <youpi> it may happen several times that vm_map_delete needs to allocate it
      while it's empty (and thus zget_space has to get called, leading to a
      hang)
    <youpi> funnily enough, the bug is also in macos X
    <youpi> it's still in my TODO list to manage to find how to submit the
      issue to them
    <braunr> really ?
    <braunr> eh
    <braunr> is that because of map entry splitting ?
    <youpi> it's git commit efc3d9c47cd744c316a8521c9a29fa274b507d26
    <youpi> braunr: iirc something like this, yes
    <braunr> netbsd has this issue too
    <youpi> possibly
    <braunr> i think it's a fundamental problem with the design
    <braunr> people think of munmap() as something similar to free()
    <braunr> whereas it's really unmap
    <braunr> with a BSD-like VM, unmap can easily end up splitting one entry in
      two
    <braunr> but your issue is more about harmful recursion right ?
    <youpi> I don't remember actually
    <youpi> it's quite some time ago :)
    <braunr> ok
    <braunr> i think that's why i have "sources" in my slab allocator, the
      default source (vm_kern) and a custom one for kernel map entries

2011-04-18

    <mcsim> braunr: you've said that once page is completely free, it is
      returned to the vm.
    <mcsim> who else, besides zone_gc, can return free pages to the vm?
    <braunr> mcsim: i also said i was wrong about that
    <braunr> zone_gc is the only one

2011-04-19

    <braunr> antrik: mcsim: i added back a new per-cpu layer as planned
    <braunr>
      http://git.sceen.net/rbraun/libbraunr.git/?a=blob;f=mem.c;h=c629b2b9b149f118a30f0129bd8b7526b0302c22;hb=HEAD
    <braunr> mcsim: btw, in mem_cache_reap(), you can clearly see there are two
      loops, just as in zone_gc, to reduce contention and avoid deadlocks
    <braunr> this is really common in memory allocators

2011-04-23

    <mcsim> I've looked through some allocators and all of them use different
      per cpu cache policy. AFAIK gnuhurd doesn't support multiprocessing, but
      still multiprocessing must be kept in mind. So, what do you think what
      kind of cpu caches is better? As for me I like variant with only per-cpu
      caches (like in slqb).
    <antrik> mcsim: well, have you looked at the allocator braunr wrote
      himself? :-)
    <antrik> I'm not sure I suggested that explicitly to you; but probably it
      makes most sense to use that in gnumach

2011-04-24

    <mcsim> antrik: Yes, I have. He uses both global and per cpu caches. But he
      also suggested to look through slqb, where there are only per cpu
      caches.\
    <braunr> i don't remember slqb in detail
    <braunr> what do you mean by "only per-cpu caches" ?
    <braunr> a whole slab sytem for each cpu ?
    <mcsim> I mean that there are no global queues in caches, but there are
      special queues for each cpu.
    <mcsim> I've just started investigating slqb's code, but I've read an
      article on lwn about it. And I've read that it is used for zen kernel.
    <braunr> zen ?
    <mcsim> Here is this article http://lwn.net/Articles/311502/
    <mcsim> Yes, this is linux kernel with some patches which haven't been
      approved to torvald's tree
    <mcsim> http://zen-kernel.org/
    <braunr> i see
    <braunr> well it looks nice
    <braunr> but as for slub, the problem i can see is cross-CPU freeing
    <braunr> and I think nick piggins mentions it
    <braunr> piggin*
    <braunr> this means that sometimes, objects are "burst-free" from one cpu
      cache to another
    <braunr> which has the same bad effects as in most other allocators, mainly
      fragmentation
    <mcsim> There is a special list for freeing object allocated for another
      CPU
    <mcsim> And garbage collector frees such object on his own
    <braunr> so what's your question ?
    <mcsim> It is described in the end of article.
    <mcsim> What cpu-cache policy do you think is better to implement?
    <braunr> at this point, any
    <braunr> and even if we had a kernel that perfectly supports
      multiprocessor, I wouldn't care much now
    <braunr> it's very hard to evaluate such allocators
    <braunr> slqb looks nice, but if you have the same amount of fragmentation
      per slab as other allocators do (which is likely), you have tat amount of
      fragmentation multiplied by the number of processors
    <braunr> whereas having shared queues limit the problem somehow
    <braunr> having shared queues mean you have a bit more contention
    <braunr> so, as is the case most of the time, it's a tradeoff
    <braunr> by the way, does pigging say why he "doesn't like" slub ? :)
    <braunr> piggin*
    <mcsim> http://lwn.net/Articles/311093/
    <mcsim> here he describes what slqb is better.
    <braunr> well it doesn't describe why slub is worse
    <mcsim> but not very particularly 
    <braunr> except for order-0 allocations
    <braunr> and that's a form of fragmentation like i mentioned above
    <braunr> in mach those problems have very different impacts
    <braunr> the backend memory isn't physical, it's the kernel virtual space
    <braunr> so the kernel allocator can request chunks of higher than order-0
      pages
    <braunr> physical pages are allocated one at a time, then mapped in the
      kernel space
    <mcsim> Doesn't order of page depend on buffer size?
    <braunr> it does
    <mcsim> And why does gnumach allocates higher than order-0 pages more?
    <braunr> why more ?
    <braunr> i didn't say more
    <mcsim> And why in mach those problems have very different impact?
    <braunr> ?
    <braunr> i've just explained why :)
    <braunr> 09:37 < braunr> physical pages are allocated one at a time, then
      mapped in the kernel space
    <braunr> "one at a time" means order-0 pages, even if you allocate higher
      than order-0 chunks
    <mcsim> And in Linux they allocated more than one at time because of
      prefetching page reading?
    <braunr> do you understand what virtual memory is ?
    <braunr> linux allocators allocate "physical memory"
    <braunr> mach kernel allocator allocates "virtual memory"
    <braunr> so even if you allocate a big chunk of virtual memory, it's backed
      by order-0 physical pages
    <mcsim> yes, I understand this
    <braunr> you don't seem to :/
    <braunr> the problem of higher than order-0 page allocations is
      fragmentation
    <braunr> do you see why ?
    <mcsim> yes
    <braunr> so
    <braunr> fragmentation in the kernel space is less likely to create issues
      than it does in physical memory
    <braunr> keep in mind physical memory is almost always full because of the
      page cache
    <braunr> and constantly under some pressure
    <braunr> whereas the kernel space is mostly empty
    <braunr> so allocating higher then order-0 pages in linux is more dangerous
      than it is in Mach or BSD
    <mcsim> ok
    <braunr> on the other hand, linux focuses pure performance, and not having
      to map memory means less operations, less tlb misses, quicker allocations
    <braunr> the Mach VM must map pages "one at a time", which can be expensive
    <braunr> it should be adapted to handle multiple page sizes (e.g. 2 MiB) so
      that many allocations can be made with few mappings
    <braunr> but that's not easy
    <braunr> as always: tradeoffs
    <mcsim> There are other benefits of physical allocating. In big DMA
      transfers can be needed few continuous physical pages. How does mach
      handles such cases?
    <braunr> gnumach does that awfully
    <braunr> it just reserves the whole DMA-able memory and uses special
      allocation functions on it, IIRC
    <braunr> but kernels which have a MAch VM like memory sytem such as BSDs
      have cleaner methods
    <braunr> NetBSD provides a function to allocate contiguous physical memory
    <braunr> with many constraints
    <braunr> FreeBSD uses a binary buddy system like Linux
    <braunr> the fact that the kernel allocator uses virtual memory doesn't
      mean the kernel has no mean to allocate contiguous physical memory ...