| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
dibs: fix use-after-free of dmb_node in loopback attach/detach/unregister
dibs_lo_attach_dmb(), dibs_lo_detach_dmb() and dibs_lo_unregister_dmb()
look up the dmb_node under dmb_ht_lock, drop the lock and only then
operate on the node's refcount. Nothing keeps the node alive across
that window: __dibs_lo_unregister_dmb() removes the node from the hash
table under the write lock and immediately frees it.
A concurrent final put can therefore free the node between the lookup
and the refcount operation:
CPU0 (attach) CPU1 (owner unregisters)
read_lock_bh(&dmb_ht_lock)
find dmb_node (refcnt == 1)
read_unlock_bh(&dmb_ht_lock)
refcount_dec_and_test() 1 -> 0
write_lock_bh(&dmb_ht_lock)
hash_del(&dmb_node->list)
write_unlock_bh(&dmb_ht_lock)
kfree(dmb_node)
refcount_inc_not_zero(&dmb_node->refcnt) <-- use-after-free
The same window exists for the refcount_dec_and_test() calls in the
detach and unregister paths.
Close the race structurally by making hash table membership and the
refcount transitions atomic with respect to each other:
- Perform the final refcount_dec_and_test() and hash_del() in a single
dmb_ht_lock write-side critical section, in both the unregister and
the detach path. Freeing the node still happens after the lock is
dropped, which is safe because a node whose refcount reached zero has
left the hash table and can no longer be found.
- This establishes the invariant that any node found in the hash table
holds at least one reference, and that the final reference can only
be dropped under the write lock. dibs_lo_attach_dmb() can thus take
its reference with a plain refcount_inc() while still holding the
read lock; refcount_inc_not_zero() is no longer needed.
__dibs_lo_unregister_dmb() no longer touches the hash table and is
renamed to dibs_lo_free_dmb() accordingly.
Note: commit cc21191b584c ("dibs: Move data path to dibs layer") moved
the code to its current location; the race was introduced earlier by
commit c3a910f2380f ("net/smc: implement DMB-merged operations of
loopback-ism").
Tested SMC-D via ISM and dibs loopback. |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Clear rb node linkage when freeing bpf_rb_root
bpf_rb_root_free() detaches the root by copying the current rb_root_cached
and then replacing the live root with RB_ROOT_CACHED. It then walks the
copied root and drops each object contained in the tree.
This leaves the rb node state intact while dropping the object. If the
object is refcounted and survives the drop, its bpf_rb_node_kern still
contains an owner pointer to the freed root and stale rb tree linkage. If
a later bpf_rb_root allocation reuses the same address, bpf_rbtree_remove()
can incorrectly pass the owner check and call rb_erase_cached() on a node
whose rb pointers belong to the old tree.
Mirror the list draining behavior by marking nodes as busy while the root
is being detached, then clear the rb node and release the owner before
dropping the containing object. This makes surviving nodes unowned and
safe to reject from remove or accept for a later add. |
| In the Linux kernel, the following vulnerability has been resolved:
RDMA/bnxt_re: Free CQ toggle page after firmware teardown
Free the toggle page only after firmware teardown completes so that
an NQ interrupt arriving during bnxt_qplib_destroy_cq() won't write
the toggle value to an already-freed page. Move free_page() after
bnxt_qplib_destroy_cq. |
| In the Linux kernel, the following vulnerability has been resolved:
mmc: vub300: fix use-after-free on probe failure
The vub300 driver lifetime-manages its controller state using
vub300->kref, with vub300_delete() freeing the mmc host when the last
reference is dropped. The probe error path after the inactivity timer has
been armed still bypasses that lifetime rule, however, and falls through
to mmc_free_host() directly if mmc_add_host() fails.
The race window is between arming the inactivity timer and reaching the
probe error unwind after mmc_add_host() fails:
probe thread timer/workqueue
------------ ---------------
kref_init(&vub300->kref) ref = 1
kref_get(&vub300->kref) ref = 2, timer ref
add_timer(inactivity_timer) fires after one second
|
| race window
|<---------------------------------------------------->
|
mmc_add_host(mmc)
inactivity timer fires
vub300_queue_dead_work()
kref_get() ref = 3
queue_work(deadwork)
mmc_add_host() fails
timer_delete_sync()
mmc_free_host(mmc)
frees vub300
deadwork runs
use-after-free
The inactivity timeout is one second, so this would require
mmc_add_host() to both fail and take more than one second to do so. This
is unlikely to happen in practice, but the error path is still wrong.
timer_delete_sync() only waits for the timer callback itself. It does
not flush deadwork that the callback may already have queued. As a
result, queued deadwork can still hold a kref while the probe error path
directly frees the backing mmc host, including the vub300 storage.
Fix this by using the same lifetime mechanism as disconnect. Clear
vub300->interface so that the timer callback and any queued deadwork
return early and drop their references, then drop the initial probe
reference and return without falling through to err_free_host. |
| In the Linux kernel, the following vulnerability has been resolved:
Bluetooth: hci_sync: extend conn_hash lookup critical sections
Using RCU-protected pointers outside the critical sections without
refcount is incorrect and may result to UAF.
Extend critical section to cover both hci_conn_hash lookup and use of
the returned conn.
Add surrounding rcu_read_lock() also when return value is not used, in
preparation for RCU lockdep requirement to hci_lookup_le_connect().
This avoids concurrent deletion of the conn before we are done
dereferencing it.
Also, make sure to hold hdev->lock when accessing hdev->accept_list. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/xe/guc: Keep scheduler timeline name alive
The scheduler keeps a pointer to the timeline name, but q->name
is freed with the exec queue while scheduler fences can still
reference it.
Store the name in struct xe_guc_exec_queue so it shares
the scheduler's RCU-deferred lifetime.
(cherry picked from commit 41075f0eb5dcbd3b065d15f15ef7bbe9315188e8) |
| In the Linux kernel, the following vulnerability has been resolved:
pds_core: fix use-after-free on workqueue during remove
In pdsc_remove(), the workqueue is destroyed before pdsc_teardown()
is called. This ordering allows two paths to queue work on the
destroyed workqueue:
1. If pdsc_teardown() -> pdsc_devcmd_reset() times out, the error
path in pdsc_devcmd_locked() queues health_work.
2. A NotifyQ event can trigger the ISR and queue work before free_irq()
is called in pdsc_teardown().
Fix by moving destroy_workqueue() after pdsc_teardown() so the
workqueue outlives every queuer; destroy_workqueue() then flushes any
work still pending.
Draining the queued work also requires ordering the teardown so the
resources that work touches are freed last:
- In pdsc_qcq_free(), after freeing the interrupt, cancel_work_sync()
the queue's work and only then clear qcq->intx, so
pdsc_process_adminq()'s read of qcq->intx for interrupt-credit
return cannot race with the clear.
- Free adminqcq before notifyqcq: the shared adminq ISR is released
when adminqcq is freed, and the adminq work accesses notifyqcq, so
both must be stopped before notifyqcq is freed. |
| In the Linux kernel, the following vulnerability has been resolved:
net/handshake: Take a long-lived file reference at submit
handshake_nl_accept_doit() needs the file pointer backing
req->hr_sk->sk_socket to survive the window between
handshake_req_next() and the subsequent FD_PREPARE() and get_file().
The submit-side sock_hold() does not provide that. sk_refcnt keeps
struct sock alive, but struct socket is owned by sock->file: when
the consumer fputs the last file reference, sock_release() tears
the socket down regardless of any sock_hold.
Add an hr_file pointer to struct handshake_req and acquire an
explicit reference on sock->file during handshake_req_submit().
handshake_complete() and handshake_req_cancel() release the
reference on the completion-bit-winning path.
The submit error path must also release the file reference, but
after rhashtable insertion a concurrent handshake_req_cancel() can
discover the request and race the error path. Gate the error-path
cleanup -- sk_destruct restoration, fput, and request destruction
-- with test_and_set_bit(HANDSHAKE_F_REQ_COMPLETED), the same
serialization handshake_complete() and handshake_req_cancel()
already use. When cancel has already claimed ownership, the submit
error path returns without touching the request; socket teardown
handles final destruction.
The accept-side dereferences are not yet retargeted; that change
comes in the next patch. |
| In the Linux kernel, the following vulnerability has been resolved:
wifi: mac80211: capture fast-RX rate before mesh reuses skb->cb
ieee80211_invoke_fast_rx() reads RX status through
IEEE80211_SKB_RXCB(skb), which aliases the same skb->cb storage
that ieee80211_rx_mesh_data() reuses as IEEE80211_TX_INFO. In the
unicast forward path, mesh_data does:
info = IEEE80211_SKB_CB(fwd_skb);
memset(info, 0, sizeof(*info));
on the same skb the caller still names via rx->skb, then either
queues the skb for TX (success) or kfree_skb()'s it (no-route)
before returning RX_QUEUED. The caller's RX_QUEUED arm then
calls sta_stats_encode_rate(status) on memory that is either
zeroed (success path) or freed (no-route path). The latter is
KASAN slab-use-after-free in ieee80211_prepare_and_rx_handle.
Fix by encoding the rate from status before invoking
ieee80211_rx_mesh_data(), so the RX_QUEUED arm consumes a value
captured while status was still backed by valid memory. |
| In the Linux kernel, the following vulnerability has been resolved:
ALSA: pcm: oss: Fix setup list UAF on proc write error
snd_pcm_oss_proc_write() links a newly allocated setup entry into the
OSS setup list before duplicating the task name. If the task-name
allocation fails, the error path frees the already linked entry and
leaves setup_list pointing at freed memory.
A later OSS device open can then walk the stale list entry in
snd_pcm_oss_look_for_setup() and dereference freed memory.
Allocate the task name and initialize the setup entry before publishing
the entry on setup_list. Also fetch the initial proc read iterator only
after taking setup_mutex, so all setup_list traversal follows the same
list lifetime rules. |
| In the Linux kernel, the following vulnerability has been resolved:
net/handshake: hand off the pinned file reference to accept_doit
handshake_req_next() removes the request from the per-net
pending list and drops hn_lock before handshake_nl_accept_doit()
reads req->hr_sk->sk_socket and dereferences sock->file (once in
FD_PREPARE() and again in get_file()). In that window a
consumer running tls_handshake_cancel() followed by sockfd_put()
(svc_sock_free) or __fput_sync() (xs_reset_transport) releases
sock->file. sock_release() then runs sock_orphan(), zeroing
sk_socket, and frees the struct socket. The accept-side code
either reads NULL through sk_socket or chases freed memory.
The submit-side sock_hold() does not prevent this. sk_refcnt
protects struct sock, but struct socket and sock->file are
independently refcounted via the file descriptor the consumer
owns. Pinning sk leaves sock and sock->file unprotected.
Retarget the accept-side dereferences at req->hr_file, which was
pinned at submit time, instead of req->hr_sk->sk_socket->file.
Pinning on its own is not sufficient: a consumer that cancels
between handshake_req_next() returning and accept_doit reaching
FD_PREPARE() takes the !remove_pending() branch in
handshake_req_cancel() and drops hr_file before the accept side
takes its own reference. Hand off an additional file reference
inside handshake_req_next(), under hn_lock, so the accept side
operates on a reference that no concurrent handshake_req_cancel()
can revoke. FD_PREPARE() consumes that handed-off reference,
either by transferring it to the new fd in fd_publish() or by
dropping it in the cleanup destructor on error; the explicit
get_file() that previously balanced FD_PREPARE() is therefore
redundant and goes away.
Update handshake_req_cancel_test2 and _test3 to simulate the
FD_PREPARE() consumption with an fput() so the kunit file-count
assertions stay balanced. |
| In the Linux kernel, the following vulnerability has been resolved:
nvmem: core: fix use-after-free bugs in error paths
Fix several instances of error paths in which we call
__nvmem_device_put() - which may end up freeing the underlying memory
and other resources - and then keep on using the nvmem structure. Always
put the reference to the nvmem device as the last step before returning
the error code. |
| In the Linux kernel, the following vulnerability has been resolved:
HID: universal-pidff: stop the device when force-feedback init fails
universal_pidff_probe() starts the device with hid_hw_start() and then, if
force-feedback initialisation fails, returns the error through a label that
only does "return error". The device is left started.
The HID core does not unwind on the driver's behalf. __hid_device_probe()
releases the devres group, closes the report and clears hdev->driver:
if (ret) {
devres_release_group(&hdev->dev, hdev->devres_group_id);
hid_close_report(hdev);
hdev->driver = NULL;
}
The hidraw character device that hid_hw_start() registered through
hid_connect() is allocated with kzalloc() and added with cdev_device_add(),
so it is not devres-managed and survives that. With hdev->driver NULL,
hid_device_remove() skips hid_hw_stop() as well, because it only unwinds
while a driver is still attached. The registration therefore outlives the
device on both paths.
Opening the surviving /dev/hidrawX writes into freed memory. KASAN reports
a use-after-free write from hidraw_open() -> hid_hw_open() -> the
transport's open callback, which takes a spinlock inside the freed object.
A descriptor that carries a PID usage page and no input reports is enough:
hidraw claims the device so hid_hw_start() succeeds, while hid->inputs
stays empty so force-feedback init fails. The other failure returns in
hid_pidff_init_with_quirks() - no output reports, an allocation failure,
pidff_init_fields(), pidff_check_autocenter(), an unusable effect count,
input_ff_create() - all reach the same label.
Stop the device on that path. hid-dr.c and hid-emsff.c, which start the
device with the same HID_CONNECT_DEFAULT & ~HID_CONNECT_FF mask, already do
this. The two earlier gotos must keep returning without hid_hw_stop(),
since neither has a started device, so give the path that fails after the
start its own label.
Discovered by XBOW, triaged by Baul Lee <baul.lee@xbow.com> |
| In the Linux kernel, the following vulnerability has been resolved:
svcrdma: Clear sc_cm_id when ADDR_CHANGE replacement fails
When svc_rdma_listen_handler() handles RDMA_CM_EVENT_ADDR_CHANGE,
it creates a replacement listener cm_id and returns 1, telling
the CM core to destroy the old one. If the replacement allocation
fails, sc_cm_id still points at the old cm_id that the CM core is
about to destroy. Any subsequent dereference of sc_cm_id --
such as svc_rdma_detach()'s rdma_disconnect() call -- is a
use-after-free.
NULL sc_cm_id on the failure path and guard svc_rdma_detach()'s
rdma_disconnect() call against NULL so that the listener can
be torn down safely when the server shuts down. |
| In the Linux kernel, the following vulnerability has been resolved:
power: supply: qcom_battmgr: fix use-after-free
qcom_battmgr_pdr_notify() queues enable_work when the PMIC GLINK service
comes up, and the worker recovers battmgr through container_of() to issue
firmware requests. The PMIC GLINK client stays on the client list until
its devres release action runs, so a PDR notification can keep queueing
the work, and a pending or running worker can access battmgr after devres
frees it.
Make enable_work device-managed with devm_work_autocancel(), registered
before the PMIC GLINK client is allocated. The devres cleanup then
releases the client first, so no further notification can queue the work,
and cancels the work before battmgr is freed.
This issue was found by an in-house static analysis tool. |
| In the Linux kernel, the following vulnerability has been resolved:
Bluetooth: MGMT: Fix list corruption and UAF in command complete handlers
Commit 302a1f674c00 ("Bluetooth: MGMT: Fix possible UAFs") introduced
mgmt_pending_valid(), which not only validates the pending command but
also unlinks it from the pending list if it is valid. This change in
semantics requires updates to several completion handlers to avoid list
corruption and memory safety issues.
This patch addresses two left-over issues from the aforementioned rework:
1. In mgmt_add_adv_patterns_monitor_complete(), mgmt_pending_remove()
is replaced with mgmt_pending_free() in the success path. Since
mgmt_pending_valid() already unlinks the command at the beginning of
the function, calling mgmt_pending_remove() leads to a double list_del()
and subsequent list corruption/kernel panic.
2. In set_mesh_complete(), the use of mgmt_pending_foreach() in the error
path is removed. Since the current command is already unlinked by
mgmt_pending_valid(), this foreach loop would incorrectly target other
pending mesh commands, potentially freeing them while they are still being
processed concurrently (leading to UAFs). The redundant mgmt_cmd_status()
is also simplified to use cmd->opcode directly. |
| In the Linux kernel, the following vulnerability has been resolved:
RDMA/efa: Fix use of completion ctx after free
On admin queue completion handling, if the admin command completed with
error we print data from the completion context. The issue is that we
already freed the completion context in polling/interrupts handler which
means we print data from context in an unknown state (it might be
already used again).
Change the admin submission flow so alloc/dealloc of the context will be
symmetric and dealloc will be called after any potential use of the
context. |
| In the Linux kernel, the following vulnerability has been resolved:
net/smc: fix UAF on lgr list traversal in smcr_port_err()
smcr_port_err() traverses smc_lgr_list.list without holding
smc_lgr_list.lock, allowing a concurrent smc_lgr_terminate_sched()
to free an lgr while it is still being dereferenced.
Hold smc_lgr_list.lock across the traversal. Update
smc_ib_gid_check() to call smcr_port_err() after releasing the lock. |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Reject pkt arguments in mutating subprogs
The verifier tracks changes in how PTR_TO_PACKET registers'
bounds are modified across subprog boundaries. PTR_TO_PACKET
registers are actually passed as PTR_TO_MEM, which is assumed
valid for the entire call. This is not the case with packet memory,
where a pskb_* call may invalidate its memory region.
Reject BPF code that passes PTR_TO_PACKET pointers to subprogs that
may mutate a packet. We cannot pass the pointer as a true PTR_TO_PACKET
because we would also need to somehow pass the PTR_TO_PACKET_META
or PTR_TO_PACKET_END to the subprog. Since we cannot avoid representing
the pointer in the subprog as PTR_TO_MEM, only permit it if the
subprog is guaranteed not to mutate the packet. |
| In the Linux kernel, the following vulnerability has been resolved:
net: bcmgenet: stop Tx NAPI before disabling the queues
bcmgenet_netif_stop() and the Wake-on-LAN branch of bcmgenet_suspend()
both disable the Tx queues first and stop Tx NAPI several steps later. A
completion in flight calls netif_tx_wake_queue() in between, and nothing
stops the queue again, so a transmit can reach the rings after they have
been freed.
Close is safe because dev_deactivate_many() stops the qdisc first.
bcmgenet_suspend() does not, so stop Tx NAPI before the queues on both
paths.
KASAN on a Raspberry Pi CM4, driven from an MTU change because suspend
freezes user space before the callback runs:
BUG: KASAN: use-after-free in bcmgenet_xmit+0x17f8/0x2258
Write of size 8 at addr ffffff8055844a68 by task ksoftirqd/0/14
bcmgenet_xmit+0x17f8/0x2258
dev_hard_start_xmit+0x13c/0x588
sch_direct_xmit+0x108/0x340
__dev_queue_xmit+0x1190/0x3848 |
