| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
rtc: pcf8563: fix clock provider leak on unbind
pcf8563_clkout_register_clk() registers the CLKOUT clock provider with
of_clk_add_provider(), but nothing ever unwinds it: there is no
of_clk_del_provider() call and the driver has no remove callback. Each
of_clk_add_provider() allocates a struct of_clk_provider, takes a
reference on the OF node and adds an entry to the global of_clk_providers
list, none of which is released when the device is unbound. Every
bind/unbind (or module reload) therefore leaks a provider structure and
an of_node reference.
The clock itself is already device-managed (devm_clk_register()); only
the provider registration was not. Use devm_of_clk_add_hw_provider() so
the provider is removed automatically on unbind. Tie it to the parent
i2c device, whose OF node carries the #clock-cells and clock-output-names
properties (the RTC class device has no OF node of its own). |
| In the Linux kernel, the following vulnerability has been resolved:
virtio_net: Fix resize of the RX ring
When a AF_XDP socket is attached, the virtnet_rx_resize
should resize the rq->xsk_buffs XSK buffer array. Otherwise,
when the size grows, the virtnet_rx_resume() causes a write
past the end of the array. This is easily reproducable with
ethtool -G ens3 rx 32
./xdpsock -i eth0 -q 0 -r -z &
ethtool -G eth0 rx 256 |
| In the Linux kernel, the following vulnerability has been resolved:
hinic3: Fix skb linearization mismatch and drop skb when skb_checksum_help() failed
Previously, hinic3_send_one_skb() cached the skb fragment count before
calling hinic3_tx_offload(). If hinic3_tx_csum() falls back to
skb_checksum_help() for unsupported tunnel packets, the skb may be
linearized. Continuing to build the TX descriptor with the stale
fragment count leads to a descriptor mismatch, which can trigger
out-of-bounds DMA reads or IOMMU faults.
Furthermore, the old code ignored the return value of skb_checksum_help(),
transmitting corrupted packets with incomplete checksums upon failure.
Fix this by:
1. Moving the hinic3_tx_offload() call before calculating 'num_sge' to
ensure the correct fragment count is used if the SKB is linearized.
2. Propagating skb_checksum_help() errors and returning
HINIC3_TX_OFFLOAD_INVALID to properly drop the skb. |
| In the Linux kernel, the following vulnerability has been resolved:
ksmbd: safely discard unregistered deferred locks
When vfs_lock_file() defers a lock, smb2_lock() puts its ksmbd_lock on
rollback_list before allocating and registering the asynchronous work.
If either operation fails, rollback assumes that smb_lock->conn is
initialized and dereferences NULL. The deferred file_lock also remains
linked into the VFS blocked-lock state while it is freed.
Keep the lock off rollback_list until async setup succeeds. On setup
failures, explicitly unblock and wake the deferred lock before freeing it
and its ksmbd wrapper. |
| In the Linux kernel, the following vulnerability has been resolved:
net: page_pool: fix UAF in __page_pool_release_netmem_dma on xa_cmpxchg race
This bug was discovered while testing the hns3 driver under channel
reconfiguration (`ethtool -L` / `ethtool -G`) with iperf3 traffic on
arm64. The race is intermittently triggered when page_pool_destroy()
runs page_pool_scrub() concurrently with page return via
page_pool_put_netmem() on a different CPU. A WARN in
page_pool_clear_pp_info() surfaced the dangling DMA index bits left
by the cmpxchg loser, which led to the investigation.
page_pool_scrub() iterates pool->dma_mapped via xa_for_each() with no
page ref held. __page_pool_release_netmem_dma() currently reads and
writes netmem fields (dma_addr, DMA index bits in pp_magic) after
xa_cmpxchg() returns. The unref path calls put_page() unconditionally
regardless of the cmpxchg outcome; when it loses the cmpxchg, it still
frees the page before the scrub winner finishes these netmem accesses,
so scrub touches a freed page -- a Use-After-Free.
Fix this by splitting the DMA release into two functions:
1. __page_pool_unmap_netmem_dma() caches dma_addr before xa_cmpxchg(),
does the cmpxchg to remove the DMA mapping, and calls dma_unmap on
the cached address. It never touches netmem fields after the cmpxchg,
making it safe for the scrub path which holds no page ref.
2. __page_pool_release_netmem_dma() wraps the above and additionally
clears dma_addr and DMA index bits in netmem fields. This is safe
only when the caller holds a page ref, so it is used by the return
path (page_pool_return_netmem).
The scrub path calls __page_pool_unmap_netmem_dma() directly; the return
path calls __page_pool_release_netmem_dma(). |
| In the Linux kernel, the following vulnerability has been resolved:
ocfs2: validate orphan slot during inode read
Patch series "ocfs2: validate active orphan slots during inode read".
OCFS2 trusts active ordinary and append-DIO orphan slots read from dinodes.
A corrupted slot can therefore index osb_orphan_wipes or the slot-local
system-inode cache outside their allocations before the corruption is
reported.
Patch 1 validates the ordinary orphan slot used by inode wipe processing.
Patch 2 validates the append-DIO orphan slot used by DIO completion and
orphan recovery. Both checks reject corrupt metadata at the existing inode
validation boundary.
This patch (of 2):
[BUG]
A corrupted dinode with OCFS2_ORPHANED_FL can carry an
i_orphaned_slot outside the mounted filesystem slot range.
ocfs2_wipe_inode() uses it to index osb_orphan_wipes before looking
up the orphan directory, causing an out-of-bounds memory access.
BUG: KASAN: slab-use-after-free in ocfs2_get_system_file_inode+0x780/0x820 fs/ocfs2/sysfile.c:102
Read of size 8 at addr ffff88800b767c00 by task kworker/u8:3/85
Call Trace:
...
ocfs2_get_system_file_inode+0x780/0x820 fs/ocfs2/sysfile.c:102
ocfs2_wipe_inode+0x292/0xf70 fs/ocfs2/inode.c:840
ocfs2_delete_inode fs/ocfs2/inode.c:1155 [inline]
ocfs2_evict_inode+0x6c9/0x1170 fs/ocfs2/inode.c:1295
evict+0x38e/0x8f0 fs/inode.c:810
iput_final fs/inode.c:1914 [inline]
iput fs/inode.c:1966 [inline]
iput+0x55b/0x8b0 fs/inode.c:1926
ocfs2_recover_orphans+0x610/0xe40 fs/ocfs2/journal.c:2374
ocfs2_complete_recovery+0x5af/0xd00 fs/ocfs2/journal.c:1373
...
[CAUSE]
ocfs2_validate_inode_block() validates i_suballoc_slot but leaves
the active ordinary orphan slot unchecked. Downstream consumers
assume that the value is smaller than osb->max_slots.
[FIX]
Reject an active i_orphaned_slot outside the slot range during
dinode validation, before the inode reaches orphan wipe processing. |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Fix UAF in bpf_trampoline_multi_attach_free on update failure
When bpf_trampoline_update() fails before modify_fentry_multi()/
unregister_fentry_multi() is called, cur_image is unchanged
(cur_image == old_image) and ftrace still calls into it. Freeing
old_image in that case causes a UAF.
Only free old_image when it differs from cur_image. |
| c-ares is an asynchronous resolver library. Prior to 1.34.7, ares_dns_parse() trusts the attacker-controlled ANCOUNT, NSCOUNT, and ARCOUNT fields before confirming that the DNS response contains enough bytes for the claimed records. Because process_answer() invokes parsing before transaction ID and question validation, a malicious DNS response can cause ares_dns_record_rr_prealloc() and ares_array_set_size() to reserve disproportionate heap memory for a tiny message. Repeated responses create large allocation and release cycles that can degrade or deny name resolution, without causing memory corruption or information disclosure. This issue is fixed in version 1.34.7. |
| c-ares is an asynchronous resolver library. Prior to 1.34.7, ares_dns_name_parse() enforces backward DNS compression pointers but does not bound the total pointer hops or assembled name length. A malicious DNS server can send a response containing a long descending pointer chain and many resource records whose NAME or RDATA fields refer to the chain, causing repeated decompression work that grows quadratically with message size. A single crafted response can stall the single-threaded c-ares event loop and deny DNS resolution, without causing memory corruption or information disclosure. This issue is fixed in version 1.34.7. |
| SysReptor is a fully customizable pentest reporting platform. Prior to 2026.55, an unauthenticated holder of a public note share link receives project-wide collaborative editing metadata because the public share consumer joins the same collaboration group as authenticated project members and forwards client information, connection, awareness, and deletion events without consistently restricting them to the shared note subtree. The disclosed metadata can identify project members through usernames and names and reveal the identifiers and live editing activity of notes that were not shared. The content of non-shared notes remains protected, and the issue does not grant write access. This issue is fixed in version 2026.55. |
| In the Linux kernel, the following vulnerability has been resolved:
octeontx2-af: fix NULL deref in NIX TM tree debugfs read path
rvu_dbg_nix_tm_tree_display() dereferences pfvf->sq_ctx without
checking whether the SQ context has been allocated. Reading
/sys/kernel/debug/octeontx2/nix/tm_tree for a NIX LF whose transmit
queues are not set up triggers a kernel oops.
Guard the read path the same way rvu_dbg_nix_tm_tree_write() already
does and return -EINVAL with a seq_file message when sq_ctx is NULL. |
| In the Linux kernel, the following vulnerability has been resolved:
xsk: honor XDP_TX_METADATA in zero-copy path
The zero-copy path reads TX metadata whenever the UMEM has metadata space,
even if the descriptor does not set XDP_TX_METADATA. Pass descriptor
options through the metadata helpers and ignore metadata unless the option
is set.
This does not fix the existing per-WQE metadata handling for mlx5 MPWQEs.
Only the descriptor that starts a session passes through
xsk_tx_metadata_request() and configures offload state shared by the batch.
Metadata on descriptors joining an open session is therefore not validated
and does not configure its requested offloads. In addition, a non-NULL
metadata pointer from such a descriptor is treated as a timestamp
completion request even when XDP_TXMD_FLAGS_TIMESTAMP is not set, so its
metadata union can be overwritten with an unrequested timestamp. Fixing
mixed metadata states within one MPWQE requires a separate change. |
| In the Linux kernel, the following vulnerability has been resolved:
Bluetooth: RFCOMM: Validate MTU in rfcomm_apply_pn() to prevent infinite loop
rfcomm_apply_pn() accepts the MTU value from a remote PN (Parameter
Negotiation) frame without checking for zero. When the remote peer
sends an MTU of zero, d->mtu is set to 0. This causes the sendmsg
path to enter an infinite loop when fragmenting data, as each fragment
has size == min_t(size_t, len, 0) == 0, so the remaining length never
decreases. The infinite allocation of zero-length skbs exhausts all
system memory.
Fix by clamping d->mtu to RFCOMM_DEFAULT_MTU when the negotiated
value is zero, consistent with the initial value assigned in
rfcomm_dlc_alloc(). |
| In the Linux kernel, the following vulnerability has been resolved:
Bluetooth: btnxpuart: Validate the FW dump header length
nxp_process_fw_dump() pulls the ACL header off the frame and then reads
seq_num and buf_len from a struct nxp_fw_dump_hdr placed at skb->data,
without checking that the ACL payload is long enough to contain it.
h4_recv_buf() collects HCI_ACL_HDR_SIZE bytes of header followed by the
number of payload bytes named in that header, so skb->len is 4 + dlen
with dlen supplied by the controller and possibly smaller than the 8
byte dump header, or zero. A short frame with connection handle 0xfff
therefore reads both fields from beyond the received data.
Beyond the read itself, buf_len is what terminates a dump: a value of
zero makes the driver call hci_devcd_complete() and reset the
controller, so a truncated frame can end a dump early.
Use skb_pull_data() to validate and pull the FW dump header before
accessing its fields. Warn and reject the chunk if the header is
truncated. |
| In the Linux kernel, the following vulnerability has been resolved:
Bluetooth: btmtksdio: Fix out-of-bounds DMA read in the TX path
btmtksdio_tx_packet() rounds the transfer size up to the SDIO block size
of 256 bytes, but hands the host controller the SKB buffer as is:
err = sdio_writesb(bdev->func, MTK_REG_CTDR, skb->data,
round_up(skb->len, MTK_SDIO_BLOCK_SIZE));
Only skb->len bytes hold packet data, so the controller reads up to 255
bytes of uninitialised memory and sends it to the device over the SDIO
bus. Depending on how much tailroom slack the SKB allocation happens to
carry, that read can also extend past the end of the buffer.
Compute the padded length up front, ensure the SKB has tailroom for it,
and zero-fill the padding with skb_put_zero(). skb->len then covers the
padding, so sdio_writesb() no longer needs to round up. byte_tx keeps
counting the header and the payload only, and the error path restores the
SKB so that the caller can requeue it.
Writing behind skb->tail is only safe because the driver owns the buffer,
which "Bluetooth: btmtksdio: Take exclusive ownership of the SKB before
TX" ensures. |
| In the Linux kernel, the following vulnerability has been resolved:
net/sched: account classifier filter allocations to memcg
Allocations in the tc classifier *_change() paths (filter objects,
per-CPU counters, and per-filter aux data) use plain GFP_KERNEL without
__GFP_ACCOUNT, allowing unprivileged users to pin kernel memory outside
memcg charging. The shared tcf_exts_init_ex() action array allocation in
cls_api.c was also uncharged; this patch closes it along with the
per-classifier filter-object/percpu/aux allocations that remain
unaccounted.
Add GFP_KERNEL_ACCOUNT to:
- the shared tcf_exts_init_ex() action array (cls_api.c), common to every
filter of every classifier (32 pointers, 256 bytes);
- the filter-object, per-CPU-counter, and per-filter aux allocations in
cls_basic, cls_bpf, cls_cgroup, cls_flow, cls_flower, cls_fw,
cls_matchall, cls_route and cls_u32;
- the u32_init_knode() replace-path knode allocation (cls_u32.c), which
allocates the same struct tc_u_knode + sel.keys on every replace of an
existing knode and was missed by the create-path-only conversion.
Also fix the cls_basic error path: basic_change() inserts fnew into the
IDR before allocating the per-CPU counter. If alloc_percpu() fails the
errout path kfree'd fnew without idr_remove, leaving a dangling pointer
in the IDR. With GFP_KERNEL_ACCOUNT the percpu alloc becomes failable
on demand (memcg at memory.max), making the dead path attacker-reachable
and burning the handle permanently. Add the idr_remove on the percpu
failure path, matching the basic_set_parms failure-path pattern.
Note: vega@nebusec.ai provided a poc for basic_cls, but it was easy to
extend to the other classifiers.
Conditions to recreate the bug:
- CONFIG_NET_SCHED, CONFIG_NET_CLS_* (the classifier being used),
CONFIG_NET_CLS_ACT, CONFIG_MEMCG, CONFIG_USER_NS, CONFIG_NET_NS.
- Unprivileged user in a fresh user+network namespace (unshare -Urn),
or root with CAP_NET_ADMIN.
- Create a large number of tc filters (e.g. tc filter add dev lo
ingress ... <classifier> ...) while watching a memcg-limited cgroup:
system slab grows far faster than memory.current, pinning kernel
memory outside memcg charging. |
| In the Linux kernel, the following vulnerability has been resolved:
NFS: Return a delegation the client fails to record
When an NFS server grants a delegation in an OPEN reply,
nfs_inode_set_delegation() records it on the client. However, three
of its error flows return without sending DELEGRETURN.
A delegation can be relinquished only by DELEGRETURN (RFC 8881
Section 20.2.4), so dropping one silently leaves the server believing
the client still holds it. If the server happens to recall that
delegation, the client answers CB_RECALL with NFS4ERR_BADHANDLE
because it has no record of the stateid. The server revokes the
delegation and moves it onto its cl_revoked list, because the client
never sends the FREE_STATEID that would drain it. Every subsequent
SEQUENCE reply then carries SEQ4_STATUS_RECALLABLE_STATE_REVOKED,
and the client's state manager loops issuing TEST_STATEID across its
delegations without ever clearing the condition.
The window is easy to reach now that a server offers a write
delegation on any write OPEN: a delegation recalled for one opener
races a re-open that the server answers with a fresh write
delegation.
Instead of dropping it, hand the delegation back during these error
flows. |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Check load-acquire src ptr type before the load
check_atomic_load() calls check_load_mem() before atomic_ptr_type_ok().
For a load-acquire that fetches into its own source register (dst_reg ==
src_reg), check_load_mem() overwrites src_reg's type with the type of the
loaded value, so the subsequent atomic_ptr_type_ok() no longer sees the
source pointer and fails to reject the disallowed types (ctx, pkt,
flow_keys, sock).
Since bpf_convert_ctx_accesses() does not rewrite atomic loads, the raw
access to the underlying kernel object is left in place. The destination
type is taken from the ctx access itself, so a load-acquire of the sk
field of struct __sk_buff for example leaves the register typed as
PTR_TO_SOCK_COMMON_OR_NULL, which type_is_sk_pointer() does not match
either, while it actually holds unconverted struct sk_buff bytes. Once
the NULL check has passed this is a type confusion, not just a leak of
kernel data.
Validate src_reg with check_reg_arg() and check the source pointer type
with atomic_ptr_type_ok() before the load again, mirroring
check_atomic_rmw(). Out-of-range register numbers are already rejected
earlier by check_and_resolve_insns() (commit 503d21ef8eac ("bpf: Do
register range validation early")), and the only exemption there,
is_stack_arg_ldx(), requires BPF_LDX | BPF_MEM | BPF_DW and thus never
matches a BPF_ATOMIC insn. atomic_ptr_type_ok() can therefore not
dereference register state out of bounds, that is, the out-of-bounds
read addressed by the Fixes commit below does not reappear (as proven
also via selftest). |
| In the Linux kernel, the following vulnerability has been resolved:
ocfs2: validate inline xattrs during inode block validation
Patch series "ocfs2: validate xattr entry bounds", v7.
This series validates OCFS2 xattr entry name/value bounds when xattr
metadata is read and validated, before getxattr() or listxattr() can walk
out-of-range entry arrays or offsets from corrupted metadata.
This patch (of 2):
ocfs2_validate_inode_block() verifies a dinode before OCFS2 users walk
metadata from it, but inline xattr metadata is still checked only in
operation-specific consumers. The existing ibody lookup helper validates
inline header placement and entry count, but inode block validation does
not reject entry name/value bounds.
Add a flat xattr entry validator and call it from inode block validation
for inline xattrs. Keep the operation paths on their existing
header/count lookup checks; the full entry bounds check now runs when the
inode block is validated at read time.
Reject corrupted inline xattr metadata before ocfs2_xattr_ibody_get() or
listxattr() can walk past the inline storage.
Validation reproduced this kernel report:
BUG: KASAN: use-after-free in ocfs2_xattr_find_entry+0x5a/0x170
Read of size 2 at addr ffff8881242a2000 by task python3/529
Call Trace:
dump_stack_lvl+0x66/0xa0
print_report+0xce/0x630
kasan_report+0xe0/0x110
ocfs2_xattr_find_entry+0x5a/0x170
ocfs2_xattr_get_nolock+0x20a/0x820
ocfs2_xattr_get+0x10c/0x1e0
__vfs_getxattr+0xe2/0x130
vfs_getxattr+0x185/0x1b0 |
| In the Linux kernel, the following vulnerability has been resolved:
blk-cgroup: fix race between policy activation and blkg destruction
When switching an IO scheduler on a block device, blkcg_activate_policy()
allocates blkg_policy_data (pd) for all blkgs attached to the queue.
However, blkcg_activate_policy() may race with concurrent blkcg deletion,
leading to use-after-free and memory leak issues.
The use-after-free occurs in the following race:
T1 (blkcg_activate_policy):
- Successfully allocates pd for blkg1 (loop0->queue, blkcgA)
- Fails to allocate pd for blkg2 (loop0->queue, blkcgB)
- Enters the enomem rollback path to release blkg1 resources
T2 (blkcg deletion):
- blkcgA is deleted concurrently
- blkg1 is freed via blkg_free_workfn()
- blkg1->pd is freed
T1 (continued):
- Rollback path accesses blkg1->pd->online after pd is freed
- Triggers use-after-free
In addition, blkg_free_workfn() frees pd before removing the blkg from
q->blkg_list. This allows blkcg_activate_policy() to allocate a new pd
for a blkg that is being destroyed, leaving the newly allocated pd
unreachable when the blkg is finally freed.
Fix these races by extending blkcg_mutex coverage to serialize
blkcg_activate_policy() rollback and blkg destruction, ensuring pd
lifecycle is synchronized with blkg list visibility. |
