Hi, Nadav,
On 6/11/19 7:21 PM, Nadav Amit wrote:
On Jun 11, 2019, at 5:24 AM, Thomas Hellström (VMware) <thellstrom@xxxxxxxxxxxxxxxxx> wrote:
From: Thomas Hellstrom <thellstrom@xxxxxxxxxx>
[ snip ]
+/**
+ * apply_pt_wrprotect - Leaf pte callback to write-protect a pte
+ * @pte: Pointer to the pte
+ * @token: Page table token, see apply_to_pfn_range()
+ * @addr: The virtual page address
+ * @closure: Pointer to a struct pfn_range_apply embedded in a
+ * struct apply_as
+ *
+ * The function write-protects a pte and records the range in
+ * virtual address space of touched ptes for efficient range TLB flushes.
+ *
+ * Return: Always zero.
+ */
+static int apply_pt_wrprotect(pte_t *pte, pgtable_t token,
+ unsigned long addr,
+ struct pfn_range_apply *closure)
+{
+ struct apply_as *aas = container_of(closure, typeof(*aas), base);
+ pte_t ptent = *pte;
+
+ if (pte_write(ptent)) {
+ pte_t old_pte = ptep_modify_prot_start(aas->vma, addr, pte);
+
+ ptent = pte_wrprotect(old_pte);
+ ptep_modify_prot_commit(aas->vma, addr, pte, old_pte, ptent);
+ aas->total++;
+ aas->start = min(aas->start, addr);
+ aas->end = max(aas->end, addr + PAGE_SIZE);
+ }
+
+ return 0;
+}
+
+/**
+ * struct apply_as_clean - Closure structure for apply_as_clean
+ * @base: struct apply_as we derive from
+ * @bitmap_pgoff: Address_space Page offset of the first bit in @bitmap
+ * @bitmap: Bitmap with one bit for each page offset in the address_space range
+ * covered.
+ * @start: Address_space page offset of first modified pte relative
+ * to @bitmap_pgoff
+ * @end: Address_space page offset of last modified pte relative
+ * to @bitmap_pgoff
+ */
+struct apply_as_clean {
+ struct apply_as base;
+ pgoff_t bitmap_pgoff;
+ unsigned long *bitmap;
+ pgoff_t start;
+ pgoff_t end;
+};
+
+/**
+ * apply_pt_clean - Leaf pte callback to clean a pte
+ * @pte: Pointer to the pte
+ * @token: Page table token, see apply_to_pfn_range()
+ * @addr: The virtual page address
+ * @closure: Pointer to a struct pfn_range_apply embedded in a
+ * struct apply_as_clean
+ *
+ * The function cleans a pte and records the range in
+ * virtual address space of touched ptes for efficient TLB flushes.
+ * It also records dirty ptes in a bitmap representing page offsets
+ * in the address_space, as well as the first and last of the bits
+ * touched.
+ *
+ * Return: Always zero.
+ */
+static int apply_pt_clean(pte_t *pte, pgtable_t token,
+ unsigned long addr,
+ struct pfn_range_apply *closure)
+{
+ struct apply_as *aas = container_of(closure, typeof(*aas), base);
+ struct apply_as_clean *clean = container_of(aas, typeof(*clean), base);
+ pte_t ptent = *pte;
+
+ if (pte_dirty(ptent)) {
+ pgoff_t pgoff = ((addr - aas->vma->vm_start) >> PAGE_SHIFT) +
+ aas->vma->vm_pgoff - clean->bitmap_pgoff;
+ pte_t old_pte = ptep_modify_prot_start(aas->vma, addr, pte);
+
+ ptent = pte_mkclean(old_pte);
+ ptep_modify_prot_commit(aas->vma, addr, pte, old_pte, ptent);
+
+ aas->total++;
+ aas->start = min(aas->start, addr);
+ aas->end = max(aas->end, addr + PAGE_SIZE);
+
+ __set_bit(pgoff, clean->bitmap);
+ clean->start = min(clean->start, pgoff);
+ clean->end = max(clean->end, pgoff + 1);
+ }
+
+ return 0;
Usually, when a PTE is write-protected, or when a dirty-bit is cleared, the
TLB flush must be done while the page-table lock for that specific table is
taken (i.e., within apply_pt_clean() and apply_pt_wrprotect() in this case).
Otherwise, in the case of apply_pt_clean() for example, another core might
shortly after (before the TLB flush) write to the same page whose PTE was
changed. The dirty-bit in such case might not be set, and the change get
lost.
Hmm. Let's assume that was the case, we have two possible situations:
A: pt_clean
1. That core's TLB entry is invalid. It will set the PTE dirty bit and
continue. The dirty bit will probably remain set after the TLB flush.
2. That core's TLB entry is valid. It will just continue. The dirty bit
will remain clear after the TLB flush.
But I fail to see how having the TLB flush within the page table lock
would help in this case. Since the writing core will never attempt to
take it? In any case, if such a race occurs, the corresponding bit in
the bitmap would have been set and we've recorded that the page is dirty.
B: wrprotect situation, the situation is a bit different:
1. That core's TLB entry is invalid. It will read the PTE, cause a fault
and block in mkwrite() on an external address space lock which is held
over this operation. (Is it this situation that is your main concern?)
2. That core's TLB entry is valid. It will just continue regardless of
any locks.
For both mkwrite() and dirty() if we act on the recorded pages *after*
the TLB flush, we're OK. The difference is that just after the TLB flush
there should be no write-enabled PTEs in the write-protect case, but
there may be dirty PTEs in the pt_clean case. Something that is
mentioned in the docs already.
Does this function regards a certain use-case in which deferring the TLB
flushes is fine? If so, assertions and documentation of the related
assumption would be useful.
If I understand your comment correctly, the page table lock is sometimes
used as the lock in B1, blocking a possible software fault until the TLB
flush has happened. Here we assume an external address space lock taken
both around the wrprotect operation and in mkwrite(). Would it be OK if
I add comments about the necessity of an external lock to the doc? Ok
with a follow-up patch?
Thanks,
Thomas
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