Mel Gorman <mgorman@xxxxxxx> wrote:
> On Tue, Jul 11, 2017 at 03:27:55PM -0700, Nadav Amit wrote:
>> Mel Gorman <mgorman@xxxxxxx> wrote:
>>
>>> On Tue, Jul 11, 2017 at 09:09:23PM +0100, Mel Gorman wrote:
>>>> On Tue, Jul 11, 2017 at 08:18:23PM +0100, Mel Gorman wrote:
>>>>> I don't think we should be particularly clever about this and instead just
>>>>> flush the full mm if there is a risk of a parallel batching of flushing is
>>>>> in progress resulting in a stale TLB entry being used. I think tracking mms
>>>>> that are currently batching would end up being costly in terms of memory,
>>>>> fairly complex, or both. Something like this?
>>>>
>>>> mremap and madvise(DONTNEED) would also need to flush. Memory policies are
>>>> fine as a move_pages call that hits the race will simply fail to migrate
>>>> a page that is being freed and once migration starts, it'll be flushed so
>>>> a stale access has no further risk. copy_page_range should also be ok as
>>>> the old mm is flushed and the new mm cannot have entries yet.
>>>
>>> Adding those results in
>>
>> You are way too fast for me.
>>
>>> --- a/mm/rmap.c
>>> +++ b/mm/rmap.c
>>> @@ -637,12 +637,34 @@ static bool should_defer_flush(struct mm_struct *mm, enum ttu_flags flags)
>>> return false;
>>>
>>> /* If remote CPUs need to be flushed then defer batch the flush */
>>> - if (cpumask_any_but(mm_cpumask(mm), get_cpu()) < nr_cpu_ids)
>>> + if (cpumask_any_but(mm_cpumask(mm), get_cpu()) < nr_cpu_ids) {
>>> should_defer = true;
>>> + mm->tlb_flush_batched = true;
>>> + }
>>
>> Since mm->tlb_flush_batched is set before the PTE is actually cleared, it
>> still seems to leave a short window for a race.
>>
>> CPU0 CPU1
>> ---- ----
>> should_defer_flush
>> => mm->tlb_flush_batched=true
>> flush_tlb_batched_pending (another PT)
>> => flush TLB
>> => mm->tlb_flush_batched=false
>> ptep_get_and_clear
>> ...
>>
>> flush_tlb_batched_pending (batched PT)
>> use the stale PTE
>> ...
>> try_to_unmap_flush
>>
>> IOW it seems that mm->flush_flush_batched should be set after the PTE is
>> cleared (and have some compiler barrier to be on the safe side).
>
> I'm relying on setting and clearing of tlb_flush_batched is under a PTL
> that is contended if the race is active.
>
> If reclaim is first, it'll take the PTL, set batched while a racing
> mprotect/munmap/etc spins. On release, the racing mprotect/munmmap
> immediately calls flush_tlb_batched_pending() before proceeding as normal,
> finding pte_none with the TLB flushed.
This is the scenario I regarded in my example. Notice that when the first
flush_tlb_batched_pending is called, CPU0 and CPU1 hold different page-table
locks - allowing them to run concurrently. As a result
flush_tlb_batched_pending is executed before the PTE was cleared and
mm->tlb_flush_batched is cleared. Later, after CPU0 runs ptep_get_and_clear
mm->tlb_flush_batched remains clear, and CPU1 can use the stale PTE.
> If the mprotect/munmap/etc is first, it'll take the PTL, observe that
> pte_present and handle the flushing itself while reclaim potentially
> spins. When reclaim acquires the lock, it'll still set set tlb_flush_batched.
>
> As it's PTL that is taken for that field, it is possible for the accesses
> to be re-ordered but only in the case where a race is not occurring.
> I'll think some more about whether barriers are necessary but concluded
> they weren't needed in this instance. Doing the setting/clear+flush under
> the PTL, the protection is similar to normal page table operations that
> do not batch the flush.
>
>> One more question, please: how does elevated page count or even locking the
>> page help (as you mention in regard to uprobes and ksm)? Yes, the page will
>> not be reclaimed, but IIUC try_to_unmap is called before the reference count
>> is frozen, and the page lock is dropped on each iteration of the loop in
>> shrink_page_list. In this case, it seems to me that uprobes or ksm may still
>> not flush the TLB.
>
> If page lock is held then reclaim skips the page entirely and uprobe,
> ksm and cow holds the page lock for pages that potentially be observed
> by reclaim. That is the primary protection for those paths.
It is really hard, at least for me, to track this synchronization scheme, as
each path is protected in different means. I still don’t understand why it
is true, since the loop in shrink_page_list calls __ClearPageLocked(page) on
each iteration, before the actual flush takes place.
Actually, I think that based on Andy’s patches there is a relatively
reasonable solution. For each mm we will hold both a “pending_tlb_gen”
(increased under the PT-lock) and an “executed_tlb_gen”. Once
flush_tlb_mm_range finishes flushing it will use cmpxchg to update the
executed_tlb_gen to the pending_tlb_gen that was prior the flush (the
cmpxchg will ensure the TLB gen only goes forward). Then, whenever
pending_tlb_gen is different than executed_tlb_gen - a flush is needed.
Nadav
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