| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
bonding: do not clear curr_active_slave prematurely when releasing all slaves
When releasing all slaves during bond destruction (all == true),
__bond_release_one() unconditionally clears bond->curr_active_slave to
NULL in every iteration.
If a backup slave is released before the active slave,
bond_alb_deinit_slave() triggers rlb_teach_disabled_mac_on_primary(),
which increments the active slave dev promiscuity counter and sets
bond_info->primary_is_promisc = 1.
Because bond->curr_active_slave was prematurely cleared to NULL when
releasing the backup slave, the subsequent iteration releasing the active
slave evaluates oldcurrent as NULL, so bond_change_active_slave(bond, NULL)
is skipped. Consequently, bond_alb_handle_active_change() is never called
to decrement the promiscuity counter, permanently leaking promiscuous
mode on the physical device after bond teardown.
When oldcurrent == slave, bond_change_active_slave(bond, NULL) already sets
bond->curr_active_slave to NULL. We only need to avoid selecting a new
active slave when all == true. Replace the if (all) branch with
if (!all && oldcurrent == slave). |
| In the Linux kernel, the following vulnerability has been resolved:
octeontx2-pf: reset HTB scheduler topology before freeing queues
HTB offload programs NIX_AF_TLxX_TOPOLOGY on QoS-allocated scheduler
queues via otx2_qos_txschq_set_parent_topology(), but teardown freed
those queues without clearing TOPOLOGY. The AF only restores PARENT and
SCHEDULE on free, so PRIO_ANCHOR/RR_PRIO settings can survive in the
shared scheduler pool and affect later allocations.
Add otx2_qos_reset_schq_topology() and otx2_qos_free_hw_schq() to zero
TL4 through TL2 TOPOLOGY before each schq is returned to the AF during
hierarchy teardown and cfg rollback. Skip the aggregation level (TL1):
it is a per-tx-link queue shared by the PF, default Tx hierarchy and VFs,
and is not freed back to the AF by nix_txschq_free_one(). |
| In the Linux kernel, the following vulnerability has been resolved:
drm/xe: Flush LSC untyped L1 dataport cache after rcs/ccs batches
emit_render_cache_flush() sets PIPE_CONTROL0_HDC_PIPELINE_FLUSH to
flush the L2/HDC data cache before fence signalling, but it never
requests a flush of the LSC untyped L1 data cache via the 'Untyped
Data-Port Cache Flush Enable' bit in PIPE_CONTROL DWord0[11].
Per the Bspec, in 3D pipeline mode HDC Pipeline Flush is documented to
also flush/invalidate the untyped L1 cache, but only depending on how
HDC_CHICKEN0[13:11] is programmed. Starting with MTL, this coupling
between HDC Pipeline Flush and the untyped L1 cache flush no longer
holds in practice, regardless of how HDC_CHICKEN0 is programmed, so
relying on it is not safe on newer platforms such as BMG. Mesa's Vulkan
driver (anv) has been assuming the kernel flushes both caches between
submissions, and hit user-visible corruption in apps such as Llama.cpp
because of this gap; it now works around it by flushing both caches
again from userspace at the end of every command buffer.
Correctness between submissions on the same queue is userspace's
responsibility and belongs in Mesa, not the kernel. However, for
security we must ensure stale data can't leak through the untyped L1
dataport cache once memory is reclaimed or evicted, which requires the
KMD to flush it before releasing memory for reuse.
Prior to MTL, HDC_CHICKEN0 could be programmed (as already done for
DG2 via Wa_22010960976/Wa_14013347512) to reliably keep HDC Pipeline
Flush coupled to the untyped L1 cache flush, so those platforms are
unaffected. Mesa's own anv driver found that on MTL the HW
disconnected the two independently of how HDC_CHICKEN0 is programmed,
and could not bring the old behavior back even by writing the register
by hand; see Mesa commit 7c2ff46a4fc3 ("anv: don't prevent L1 untyped
cache flush in 3D mode"). The kernel can't reliably request the flush
from the CS on MTL either, so restrict the new PIPE_CONTROL bit to
GRAPHICS_VERx100 >= 2000 (Xe2 and later), where it can be relied on.
Explicitly set PIPE_CONTROL0_UNTYPED_DATAPORT_CACHE_FLUSH together
with PIPE_CONTROL0_HDC_PIPELINE_FLUSH in emit_render_cache_flush() on
Xe2 and later, so the L1 data cache is known clean before memory is
released for reuse, without depending on undocumented
platform-specific HDC_CHICKEN0 behavior.
Bspec: 56551
(cherry picked from commit 434514b6fe731e873808297c268fc52cdf4a1ce6) |
| In the Linux kernel, the following vulnerability has been resolved:
s390/crypto: Fix missing scrub of temp buffers with AES ctr and gcm algorithm
In function ctr_aes_crypt() there is a buffer used to process
remaining bytes < AES_BLOCK_SIZE. This buffer was not scrubbed and
thus could lead to expose of unwanted data. When the buffer is used
explicitly scrub it at the end of the code block to avoid exposure of
maybe sensitive data.
In a similar way the function gcm_aes_crypt() hat an error path where
the CPACF param block was not scrubbed. Instead of return early now
these error paths go to end of function where explicit scrubbing is
done. Similar with the buffers which are part of the gcm_sg_walk
structs from the variables gw_in and gw_out. |
| In the Linux kernel, the following vulnerability has been resolved:
spi: core: Abort active target transfer on controller suspend
When an SPI controller operating in target mode has a transfer in
progress at the time of system suspend, the suspend path proceeds
without aborting the ongoing transfer. This can leave the hardware in
an inconsistent state, potentially causing the system to hang or fail
to resume cleanly.
Fix this by invoking the controller's target_abort callback from
spi_controller_suspend() when the controller is in target mode and the
callback is registered. This ensures any active target transfer is
cleanly terminated before the controller is suspended. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/pagemap: dma-unmap pages before handling migration errors
drm_pagemap_migrate_unmap_pages() relies on the pages array to determine
which pages require DMA unmapping. However,
drm_pagemap_migration_unlock_put_pages() clears the array as part of its
cleanup, leaving drm_pagemap_migrate_unmap_pages() with no valid page
information if it is called afterward.
Call drm_pagemap_migrate_unmap_pages() before
drm_pagemap_migration_unlock_put_pages() so the pages array remains
valid during DMA unmapping. |
| In the Linux kernel, the following vulnerability has been resolved:
f2fs: fix dentry folio leak in find_in_level
find_in_level() gets a dentry folio with f2fs_find_data_folio() before
calling find_in_block(). If find_in_block() returns an error, the
function stores the error in res_folio and breaks out of the loop without
dropping the dentry folio.
This leaks the folio reference on the find_in_block() error path. Drop
the dentry folio before returning the error to the caller. |
| In the Linux kernel, the following vulnerability has been resolved:
PCI: Allow per function PCI slots to fix slot reset on s390
On s390 systems, which use a machine level hypervisor, PCI devices are
always accessed through a form of PCI pass-through which fundamentally
operates on a per PCI function granularity. This is also reflected in the
s390 PCI hotplug driver which creates hotplug slots for individual PCI
functions. Its reset_slot() function, which is a wrapper for
zpci_hot_reset_device(), thus also resets individual functions.
Currently, the pci_create_slot() assigns the same pci_slot object to
multifunction devices. This approach worked fine on s390 systems that only
exposed virtual functions as individual PCI domains to the operating
system. Since commit 44510d6fa0c0 ("s390/pci: Handling multifunctions")
s390 supports exposing the topology of multifunction PCI devices by
grouping them in a shared PCI domain. This creates a problem when resetting
a function through the hotplug driver's slot_reset() interface.
When attempting to reset a function through the hotplug driver, the shared
slot assignment causes the wrong function to be reset instead of the
intended one. It also leaks memory as we do create a pci_slot object for
the function, but don't correctly free it in pci_slot_release().
Add a flag for struct pci_slot to allow per function PCI slots for
functions managed through a hypervisor, which exposes individual PCI
functions while retaining the topology. Since we can use all 8 bits for
slot 'number' (for ARI devices), change slot 'number' u16 to account for
special values PCI_SLOT_PLACEHOLDER and PCI_SLOT_ALL_DEVICES. |
| In the Linux kernel, the following vulnerability has been resolved:
platform/x86/amd/pmc: Fix LPS0 and debugfs leaks when STB init fails
amd_pmc_probe() registers the LPS0 s2idle handler with
acpi_register_lps0_dev() and creates the driver's debugfs directory before
calling amd_stb_s2d_init(), which is the last step in probe that can fail.
When amd_stb_s2d_init() fails (for example the S2D telemetry region cannot
be ioremapped on a long-running system, or the SMU rejects the S2D setup)
the error path only calls pci_dev_put() and returns. This leaves
amd_pmc_s2idle_dev_ops on the global lps0_s2idle_devops_head list and leaks
the debugfs directory, while the devm-managed resources backing the handler
are torn down.
Reloading the module then walks the corrupted list in
acpi_register_lps0_dev() and hits:
list_add corruption. next->prev should be prev, but was NULL.
kernel BUG at lib/list_debug.c:29!
acpi_register_lps0_dev+0x44/0x80
amd_pmc_probe+0x224/0x380 [amd_pmc]
platform_probe+0x67/0x90
Even without a reload, the stale registration means the next s2idle
transition calls into torn-down driver state.
Unwind the debugfs directory and the LPS0 registration on the
amd_stb_s2d_init() error path. acpi_unregister_lps0_dev() is safe to call
unconditionally here: it is guarded on the same conditions as
acpi_register_lps0_dev(), which is exactly what amd_pmc_remove() already
relies on. |
| In the Linux kernel, the following vulnerability has been resolved:
usb: typec: ucsi: unregister debugfs entries on teardown
ucsi_register() creates per-instance debugfs entries, but
ucsi_unregister() keeps them around until ucsi_destroy().
Drivers like ucsi_glink that unregister/register the same UCSI
instance across remoteproc restart then try to create an already
existing debugfs directory and log:
debugfs: 'pmic_glink.ucsi.0' already exists in 'ucsi'
Unregister debugfs entries as part of ucsi_unregister(), and
clear ucsi->debugfs after freeing it so repeated unregister
paths remain safe. |
| Incomplete cleanup in Bluetooth in Google Chrome prior to 154.0.8037.57 allowed a remote attacker leveraging social engineering to bypass system access restrictions via a crafted HTML page. (Chromium security severity: Low) |
| Incomplete cleanup in SmartCard in Google Chrome prior to 154.0.8037.57 allowed a remote attacker leveraging social engineering to bypass system access restrictions via a crafted HTML page. (Chromium security severity: Medium) |
| 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. |
| Zebra before 6.2.1 contains an incomplete cleanup vulnerability that allows unauthenticated peers to block downloading of valid blocks by leaving rejected hashes in SentHashes. Attackers can send a contextually invalid block sharing an honest block's header hash, causing Request::KnownBlock to skip the honest block and keep nodes behind the tip. |
| Zebra before 6.1.0 contains an incomplete cleanup vulnerability in the state write task that allows remote unauthenticated peers to stall node synchronization by poisoning parent_error_map. Attackers can deliver a coinbase-malleated block sharing a canonical block's hash before it propagates, causing the next canonical block to be rejected and stalling the node for roughly 2,000 blocks. |
| In the Linux kernel, the following vulnerability has been resolved:
s390/crypto: Fix missing scrub of temp buffers with PAES algorithm
In function ctr_paes_do_crypt() there is a buffer used to process
remaining bytes < AES_BLOCK_SIZE. This buffer was not scrubbed and
thus could lead to expose of unwanted data. Rework the code to
explicitly scrub the buffer at the end of the function to avoid
exposure of maybe sensitive data.
In function __xts_2keys_prep_param() change the existing scrub to
clean the whole param block instead of just the key field. |
| In the Linux kernel, the following vulnerability has been resolved:
virtio_ring: fix stale descriptor flags after a failed packed add
In a packed ring the AVAIL and USED bits sit in the descriptor itself,
so writing them makes that descriptor available. Those bit combinations
flip meaning on every round of the ring, tracked by a wrap counter, so
invalidating or validating a descriptor means inverting both bits.
Commit 1ce9e6055fa0 ("virtio_ring: introduce packed ring support") has
virtqueue_add_packed() make every descriptor of a chain available as it
maps the chain, and write the head last. The device consumes the ring in
order and stops at a head that is not available yet, so it never reaches
the rest.
When vring_map_one_sg() fails partway, unmap_release unmaps the segments
and restores avail_used_flags, but the descriptors it wrote to in the
ring stay marked with AVAIL and USED bits. The head is now the only
entry that keeps the device from consuming these stale entries.
For example, the ring would look like this now.
Z - pre-previous command
A - previous command
B - aborted command
C - current command
[A1 DONE] [A2 DONE] <C1 EMPTY> [B2] [B3] [Z1 DONE]
When the driver now attempts to issue the C command, the next add starts
at the same head as B. If C spans less descriptors than B, there is no
end marker because AVAIL and USED bits were still in place. And that
means the device will start interpreting these stale entries (B2/B3) as
another command entry, which then blocks the queue.
This effect typically happens in swiotlb configurations under memory
pressure, because vring_map_one_sg() can then fail with larger I/O
requests which then leads to command abortions.
There are broadly 2 ways to avoid leaving those flags behind:
1) Defer those flags too until the chain is complete.
2) Rewrite those flags for the previous wrap counter.
Implement the second option in both packed add paths. The first option
traverses the chain a second time on every successful add. The second
option invalidates all added descriptors when any add fails.
With this patch applied, a packed virtqueue keeps completing requests
after a failed add. |
| Das U-Boot with CONFIG_IP_DEFRAG=y parameter fails to clear IP reassembly state after delivering a complete datagram. An attacker who can deliver fragmented IP traffic can execute arbitrary code by sending duplicated last-fragment IP packets.
This issue was fixed in commit b1aec609bb5e0d08c25c888c91935287ab4ee5fa in version 2026.07. |
| In the Linux kernel, the following vulnerability has been resolved:
eth: nfp: drop the replaced rule from the list when reprogramming fails
nfp_net_fs_add() replaces an existing rule by deleting it from the
hardware, decrementing nn->fs.count and programming the new one. If
nfp_net_fs_add_hw() fails the old entry stays on nn->fs.list - only the
success path reaches list_replace() - so the list is one longer than
nn->fs.count, and it advertises a rule whose hardware entry has already
been torn down.
nn->fs.count is what ETHTOOL_GRXCLSRLCNT reports, so userspace then sizes
its buffer one entry short of what the GRXCLSRLALL walk wants to write.
That used to overwrite one u32 past the allocation; since the walk is
bounded it is a permanent -EMSGSIZE instead, as nothing ever resyncs the
counter. |
| A flaw has been found in ag-ui-protocol ag-ui up to 2026-09-07. This vulnerability affects the function FilterToolCallsMiddleware of the file sdks/typescript/packages/client/src/middleware/filter-tool-calls.ts of the component Middleware. Executing a manipulation can lead to incomplete cleanup. The attack may be launched remotely. Upgrading to version 2026-09-08 is able to resolve this issue. This patch is called c346119fe870b70f5c19738ee5119f3e1456e59d. It is suggested to upgrade the affected component. |
