On Mon, 2007-05-21 at 12:43 -0700, Christoph Lameter wrote:
quoted text
> On Mon, 21 May 2007, Peter Zijlstra wrote:
> 
> > > So the original issue is still not fixed. A slab alloc may succeed without
> > > watermarks if that particular allocation is restricted to a different set 
> > > of nodes. Then the reserve slab is dropped despite the memory scarcity on
> > > another set of nodes?
> > 
> > I can't see how. This extra ALLOC_MIN|ALLOC_HIGH|ALLOC_HARDER alloc will
> > first deplete all other zones. Once that starts failing no node should
> > still have pages accessible by any allocation context other than
> > PF_MEMALLOC.
> 
> This means we will disobey cpuset and memory policy constraints?

quoted text
>From what I can make of it, yes. Although I'm a bit hazy on the
mempolicy code.

Note that disobeying these constraints is not new behaviour. PF_MEMALLOC
needs a page, and will get a page, no matter what the cost.

quoted text
> > > No the gfp zone flags are not uniform and placement of page allocator 
> > > allocs through SLUB do not always have the same allocation constraints.
> > 
> > It has to; since it can serve the allocation from a pre-existing slab
> > allocation. Hence any page allocation must be valid for all other users.
> 
> Why does it have to? This is not true.

Say the slab gets allocated by an allocation from interrupt context; no
cpuset, no policy. This same slab must be valid for whatever allocation
comes next, right? Regardless of whatever policy or GFP_ flags are in
effect for that allocation.

quoted text
> > > SLUB will check the node of the page that was allocated when the page 
> > > allocator returns and put the page into that nodes slab list. This varies
> > > depending on the allocation context.
> > 
> > Yes, it keeps slabs on per node lists. I'm just not seeing how this puts
> > hard constraints on the allocations.
> 
> The constraints come from the context of memory policies and cpusets. See
> get_any_partial().

but get_partial() will only be called if the cpu_slab is full, up until
that point you have to do with whatever is there.

quoted text
> > As far as I can see there cannot be a hard constraint here, because
> > allocations form interrupt context are at best node local. And node
> > affine zone lists still have all zones, just ordered on locality.
> 
> Interrupt context is something different. If we do not have a process 
> context then no cpuset and memory policy constraints can apply since we
> have no way of determining that. If you restrict your use of the reserve 
> cpuset to only interrupt allocs then we may indeed be fine.

No, what I'm saying is that if the slab gets refilled from interrupt
context the next process context alloc will have to work with whatever
the interrupt left behind. Hence there is no hard constraint.

quoted text
> > > Allocations can be particular to uses of a slab in particular situations. 
> > > A kmalloc cache can be used to allocate from various sets of nodes in 
> > > different circumstances. kmalloc will allow serving a limited number of 
> > > objects from the wrong nodes for performance reasons but the next 
> > > allocation from the page allocator (or from the partial lists) will occur 
> > > using the current set of allowed nodes in order to ensure a rough 
> > > obedience to the memory policies and cpusets. kmalloc_node behaves 
> > > differently and will enforce using memory from a particular node.
> > 
> > >From what I can see, it takes pretty much any page it can get once you
> > hit it with PF_MEMALLOC. If the page allocation doesn't use ALLOC_CPUSET
> > the page can come from pretty much anywhere.
> 
> No it cannot. One the current cpuslab is exhaused (which can be anytime) 
> it will enforce the contextual allocation constraints. See 
> get_any_partial() in slub.c.

If it finds no partial slabs it goes back to the page allocator; and
when you allocate a page under PF_MEMALLOC and the normal allocations
are exhausted it takes a page from pretty much anywhere.


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