| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
smb: client: pin DFS superblock in iterator callback
tcon_super_cb() stores a raw superblock pointer, but __cifs_get_super()
takes its active reference only after iterate_supers_type() has dropped
s_umount and its passive reference. Concurrent DFS automount expiry can
therefore free the superblock before cifs_sb_active() uses it.
A deterministic KASAN test reproduces the race as:
BUG: KASAN: slab-use-after-free in cifs_sb_active+0x77/0x80
The same test passes with this change applied.
Take the active reference in the callback while iterate_supers_type()
still holds s_umount shared. cifs_put_tcp_super() remains the matching
release. |
| In the Linux kernel, the following vulnerability has been resolved:
smb: client: avoid leaking refcount in cifs_queue_oplock_break()
cifs_queue_oplock_break() unconditionally takes a reference on the
target file before queueing cifs_oplock_break(). Only that work item
decreases the reference counter again.
If another oplock break arrives while that work is still queued,
queue_work() will return false and not queue this second work item. As a
result, we will never reach the point to drop the file reference again
and are leaking this reference. This can be triggered when interacting
with a slow-responding server.
As a result, later unmount operations for this file system will fail with
BUG: Dentry ... still in use (1) [unmount of cifs cifs]
VFS: Busy inodes after unmount of cifs (cifs)
kernel BUG at fs/super.c:777!
Fix this by only incrementing the reference count if the work has been
queued successfully. Taking it after queue_work() is safe because all
three callers hold tcon->open_file_lock across the call and
_cifsFileInfo_put() decrements under that same lock, so a worker that
starts the handler in the window cannot drop the reference before it has
been taken. |
| In the Linux kernel, the following vulnerability has been resolved:
smb: client: fix heap overflow in DACL owner/group rewrite
When id_mode_to_cifs_acl rewrites an existing DACL, it allocates a
buffer sized according to the on-disk DACL length reported by
dacl_ptr->size. However, replace_sids_and_copy_aces may rewrite each
ACE with a new owner/group SID obtained from the cifs.idmap upcall.
Those SIDs can have up to SID_MAX_SUB_AUTHORITIES (15) sub-authorities,
making each ACE up to 76 bytes (sizeof(struct smb_ace)).
If the original DACL contains short SIDs (e.g., 1 sub-authority) while
the replacement SIDs are long, the rewritten ACEs overflow the
allocation.
Fix this by always budgeting for worst-case SID expansion: allocate
sizeof(struct smb_acl) plus num_aces * sizeof(struct smb_ace), which
covers the smb_acl header and room for every ACE at maximum SID size.
This replaces the previous split logic that used dacl_ptr->size for
cifsacl mounts but num_aces * sizeof(struct smb_ace) for mode_from_sid
mounts: both paths can trigger the same rewrite and need the same
headroom.
KASAN reports this as:
BUG: KASAN: slab-out-of-bounds in build_sec_desc+0x1e8a/0x2680 [cifs]
Write of size 4 at addr ffff8881a5e25374 by task chown/5298
...
The buggy address is located 0 bytes to the right of
allocated 884-byte region [ffff8881a5e25000, ffff8881a5e25374) |
| In the Linux kernel, the following vulnerability has been resolved:
xfs: fix the rtrmap and rtrefcount _maxlevels_ondisk functions
The _maxlevels_ondisk functions are used to compute the size of
in-memory btree cursors for each btree type. Unfortunately, LOLLM
noticed that the rtrmap and rtrefcount versions of these functions
forget to account for the inode root, which means that we could access
beyond the end of the cursor given a sufficiently large btree. Fix
this. |
| In the Linux kernel, the following vulnerability has been resolved:
scsi: qla2xxx: Fix use-after-free of qpair work on queue teardown
The response queue MSI-X handler qla2xxx_msix_rsp_q() schedules
qla_do_work() via queue_work(ha->wq, &qpair->q_work). qla_do_work()
dereferences the qpair (vha, rsp) and takes qpair->qp_lock.
During teardown, qla2xxx_delete_qpair() deletes the response queue, which
calls free_irq() in qla25xx_free_rsp_que(), and then frees the queue and
the qpair. free_irq() waits for running hardirq handlers but does not
cancel work already placed on ha->wq. A still-pending q_work then runs
qla_do_work() against the freed qpair and response queue, causing a
use-after-free. This is especially likely during full adapter teardown,
where destroy_workqueue(ha->wq) forces pending work to run after the queue
pairs have been freed.
Flush the work item with cancel_work_sync() in qla25xx_free_rsp_que()
after free_irq() has released the interrupt (so no new work can be
queued) and before the response queue and qpair memory are freed (so the
flushed handler still sees valid memory). Guard on rsp->qpair and ha->wq
to match the INIT_WORK() condition and avoid operating on an
uninitialized work_struct. |
| In the Linux kernel, the following vulnerability has been resolved:
scsi: qla2xxx: Skip vport under deletion in report ID acquisition
qla24xx_report_id_acquisition() format-1 handling walks ha->vp_list under
vport_slock, takes a vref_count on the matching vport and calls
qla_update_host_map() to register its port id.
A vport teardown via qla24xx_vport_delete() sets VPORT_DELETE, then
qla24xx_disable_vp() removes the vport from the host_map btree and zeroes
vha->d_id (RESET_AL_PA). The vport is only unlinked from vp_list later,
in qla24xx_deallocate_vp_id(), which clears vp_map[idx] (RESET_VP_IDX)
but does not touch host_map. In the window in between, report ID
acquisition can still find the vport on vp_list and call
qla_update_host_map(); with d_id already zeroed it takes the
btree_insert32() path and re-inserts the dying vport into host_map.
Nothing cleans that entry afterwards, so once scsi_host_put() frees the
vha a later host_map lookup dereferences freed memory.
Skip a vport that has VPORT_DELETE set before taking the reference, so it
is neither re-registered nor scheduled for DPC re-registration. This
mirrors the existing guard in qla2x00_alert_all_vps(). |
| In the Linux kernel, the following vulnerability has been resolved:
scsi: qla2xxx: Unlink NVMe unsol ctx before freeing on LS reject error
qla_nvme_xmt_ls_rsp() obtains uctx, which was linked into
fcport->unsol_ctx_head by qla2xxx_process_purls_iocb() and is still linked
when the NVMe transport calls back to transmit the LS response. On the
error (out:) path the function frees uctx with kfree() but never removes
it from the list. This leaves a freed node in fcport->unsol_ctx_head: the
next list_add_tail() for that fcport writes through the freed node, and a
subsequent list_del() can corrupt the list or panic.
Unlink uctx with list_del() before kfree() on the error path, matching the
other free sites in qla_nvme_release_lsrsp_cmd_kref() and
qla2xxx_process_purls_pkt(). qla2x00_rel_sp() in the failure path only
returns the SRB to its pool and does not invoke sp->put_fn, so the out:
path is the sole free and uctx is always still linked there. |
| In the Linux kernel, the following vulnerability has been resolved:
scsi: qla2xxx: Serialize NVMe unsol ctx list with a per-fcport lock
The fcport->unsol_ctx_head list is modified from several contexts without
a common lock. Entries are added in qla2xxx_process_purls_iocb() from the
response queue ISR (under the qpair qp_lock), while they are removed from
qla2xxx_process_purls_pkt() (DPC/purex worker), qla_nvme_xmt_ls_rsp()
(NVMe-FC transport callback) and qla_nvme_release_lsrsp_cmd_kref() (SRB
completion). The qpair qp_lock cannot serialize this per-fcport list since
multiqueue adapters add entries through different qpairs, so a concurrent
add and delete (or two concurrent deletes) can corrupt the list pointers.
Introduce a dedicated per-fcport spinlock, unsol_ctx_lock, initialized in
qla2x00_alloc_fcport(), and take it around every list_add_tail()/list_del()
on unsol_ctx_head. The add nests under the existing qp_lock; no delete path
takes qp_lock, so the lock order is consistent and deadlock free. |
| In the Linux kernel, the following vulnerability has been resolved:
x86/mm/pat: Allocate split page tables as kernel page tables
A PTE is allocated directly without going through the standard page table
allocation routines (such as pte_alloc_one_kernel()) when the CPA code
splits a large page (__split_large_page()).
This means the page table constructor is never called nor is the page table
marked as a kernel page table.
The former results in the folio associated with the page table not being
marked as a page table (__pagetable_ctor() is never called thus neither is
__folio_set_pgtable()) nor are statistics updated to reflect
it (lruvec_stat_add_folio() is never called).
The latter issue of failing to mark the page table as a kernel page
table (ptdesc_set_kernel() is never called) is far more problematic.
Since commit:
5ba2f0a15564 ("mm: introduce deferred freeing for kernel page tables")
kernel page table freeing has been batched and since the
subsequent commit:
e37d5a2d60a3 ("iommu/sva: invalidate stale IOTLB entries for kernel address space")
IOTLB cache entries for kernel page tables have been invalidated upon
being freed.
Since split page tables are freed without this invalidation, the IOTLB
can contain stale entries for them.
Resolve the issue by using the ordinary PTE allocation API at split time.
This results in these kernel page tables invoking a page table constructor,
and thus requires a page table destructor.
Destructors are not always present, like for early allocated direct map
page tables). Conditionally call pagetable_dtor_free() if the PG_table
folio flag for the ptdesc is set, otherwise we free the page table via
pagetable_free().
Regardless of which path is taken page tables marked as kernel page tables,
which now includes split page tables, take the correct route through
pagetable_free_kernel().
There is a user-visible side effect in that split page tables will appear
in nr_page_table_pages in /proc/vmstat (as do other kernel page tables
allocated after early boot), however this is a positive change.
This issue started being markedly problematic after commit:
5ba2f0a15564 ("mm: introduce deferred freeing for kernel page tables")
so choose this as the Fixes target.
[ dhansen: rephrase in imperative mood ] |
| In the Linux kernel, the following vulnerability has been resolved:
mptcp: avoid unneeded actions on subflow reset
Once in a blue moon, the mptcp receive path can recursively call
mptcp_data_ready() via state change under unlucky error conditions, and
then try to hold the data lock again.
Break the recursion loop explicitly checking for the exceptional
condition.
Add a new flag instead of using an existing one like 'closing', to exit
early in subflow_state_change(), and explicitly flush the RX queue at
reset time.
This avoids unneeded processing to check for available data -- calling
get_mapping_status() and more on a dying subflow -- but also in error
reporting and worker scheduling.
Note that we must consume the currently peeked skb before invoking
mptcp_dss_corruption to avoid consuming it again after the eventual
reset has freed it. |
| In the Linux kernel, the following vulnerability has been resolved:
mptcp: close race between scheduler and state change
The mptcp scheduler may race with subflow sockets state change: data
transmission on the selected socket may fail and a later release could
try to use mss_now reset to 0 for a divide operation.
Address the issue by explicitly checking for the critical scenario. |
| In the Linux kernel, the following vulnerability has been resolved:
RDMA/srpt: Fix srpt_alloc_rw_ctxs() unwind counters
When srpt_alloc_rw_ctxs() fails partway through a multi-buffer indirect
descriptor, the unwind path destroys RDMA contexts but leaves stale
n_rw_ctx and n_rdma values (and a dangling rw_ctxs pointer). Later
sq_wr_avail accounting in srpt_queue_response() or srpt_write_pending()
can then subtract the wrong number of send queue credits.
Reset the counters and clear rw_ctxs after freeing the heap
allocation before returning an error. |
| A MongoDB driver component could write sensitive configuration information, including a credential used for outbound network connectivity, to application log output in cleartext during routine client initialization. This occurs automatically as part of normal operation and requires no special privileges to trigger. A party able to read the affected application's logs or downstream log-aggregation storage could recover the credential and reuse it to authenticate to the associated network infrastructure. This issue affects confidentiality only. |
| Improper limitation of a pathname to a restricted directory ('path traversal') in Azure Arc allows an unauthorized attacker to elevate privileges over a network. |
| This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. |
| This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. |
| This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. |
| This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. |
| This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. |
| This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. |
