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82,706 matching · page 21/1655Each CVE id links to its NVD record.
| CVE | Severity | CVSS | Summary | Published |
|---|---|---|---|---|
| CVE-2026-120627(opens NVD record) | Unscored | — | The Private Internet Access Extension for Firefox contains an unguarded onAuthRequired authentication handler, leading to leakage of PIA proxy credentials when a user visits any malicious website that issues a Basic auth challenge. This issue was fixed in version 3.2.5, but reintroduced in later versions. | Nov 2, 2026 |
| CVE-2026-120416(opens NVD record) | Medium | 5.3 | A security vulnerability has been detected in AndyFactory newspaper4k up to 0.9.6. This affects the function Article.parse of the file newspaper/extractors/image_extractor.py of the component Image Extractor. Such manipulation leads to server-side request forgery. It is possible to launch the attack remotely. Upgrading to version 0.9.6.1 mitigates this issue. The name of the patch is eec5fab21897c14667c98f5ba1831ebd3a692dd4. Upgrading the affected component is advised. The vendor was contacted early, responded in a very professional manner and quickly released a fixed version of the affected product. | Nov 2, 2026 |
| CVE-2026-119085(opens NVD record) | High | 8.8 | Improper neutralization of special elements used in a template engine in the publishing component of Amazon Virtual Engineering Workbench (VEW) could allow a remote authenticated third party to run arbitrary code with the permissions of the publishing Lambda's IAM role. This could allow access to data and resources across all tenant projects. The code is reachable through a crafted CloudFormation template body containing template engine directives submitted through the product versioning API. To remediate this issue, users should redeploy from the latest version of awslabs/virtual-engineering-workbench. | Nov 2, 2026 |
| CVE-2026-117068(opens NVD record) | Unscored | — | An integer underflow vulnerability in the NAS decoder of OpenAirInterface (OAI) CN5G AMF v2.2.1 allows an unauthenticated remote attacker to cause a denial of service (DoS) via crafted NAS Registration Requests containing a truncated SUCI in the 5GS Mobile Identity IE. Insufficient length validation in the DecodeSuci() function results in an out-of-bounds heap read, causing the AMF process to crash. | Nov 2, 2026 |
| CVE-2026-117067(opens NVD record) | Unscored | — | An out-of-bounds memory access vulnerability in the N2 SCTP interface of OpenAirInterface (OAI) CN5G AMF v2.2.1 allows an unauthenticated remote attacker to cause a denial of service (DoS) by repeatedly establishing SCTP associations, resulting in a process crash due to improper file descriptor bounds checking in the FD_SET() operation. | Nov 2, 2026 |
| CVE-2026-111048(opens NVD record) | Unscored | — | FOSSBilling is an open source billing and client-management platform. From 0.1.0 until 0.8.9, the admin/support/note_create endpoint stores the note parameter without sanitization in the support_ticket_note table, and src/modules/Support/templates/admin/mod_support_tickets.html.twig renders each stored support ticket note through innerHTML in the admin ticket list. A staff user with only the support.manage_tickets permission can store HTML or JavaScript that executes when another staff member opens the ticket notes. The script runs with the viewing staff member's session and privileges, can read a CSRF token and accessible client or invoice data, and can perform administrative actions available to the viewer, including a Super Administrator. The ticket detail page is not affected because its Twig rendering uses autoescaping. This issue is fixed in version 0.8.9. | Nov 2, 2026 |
| CVE-2026-106808(opens NVD record) | High | 7.5 | OpenAirInterface Core Network v2.2.1 has a stack-based buffer overflow vulnerability in the OAI CN5G UDM Nudm_UEAU Generate Authentication Data endpoint. The UDM passes attacker-controlled resynchronizationInfo.rand and auts values to conv::hex_str_to_uint8(), which converts arbitrary-length hex strings into fixed-size stack buffers without validating the destination size. An unauthenticated attacker with access to the SBI interface and a valid SUPI can submit an oversized value to overwrite adjacent stack memory, corrupt the stack canary, and terminate the UDM process. | Nov 2, 2026 |
| CVE-2026-106806(opens NVD record) | Unscored | — | A memory exhaustion issue exists in Open5GS v2.8.0 in the HTTP/2 SBI server. Repeated header names cause previously allocated header strings to be leaked, and HPACK compression allows an unauthenticated remote attacker to trigger tens of thousands of duplicate headers with a small request. Repeated crafted requests can cause persistent heap growth, exhaust process memory, and terminate the affected Open5GS network function, resulting in denial of service. | Nov 2, 2026 |
| CVE-2024-12139(opens NVD record) | Medium | 4.3 | The error handling implementation fails to properly sanitize or validate user-supplied input within URL parameters under specific conditions. This allows end-users to manipulate the error messages that are displayed by the application. By exploiting this vulnerability, malicious actors can inject arbitrary content into error messages. This enables them to perform social engineering attacks, such as phishing or credential theft, by replacing legitimate error messages with malicious content, misleading users into compromising sensitive information or taking harmful actions. | Nov 2, 2026 |
| CVE-2026-88811(opens NVD record) | Critical | 9.1 | Missing filtering in the SUSE Rancher Manager meta proxy could cause passed in rancher credentials to be leaked to cloud providers. This affects SUSE Rancher 2.15.0 up to 2.15.3, 2.14.0 up to 2.14.7, 2.13.0 up to 2.13.11, | Nov 2, 2026 |
| CVE-2026-88810(opens NVD record) | High | 7.2 | A privilege escalation issue was discovered in Rancher Manager's role-based access control. The inheritedNamespacedRules field of a GlobalRole propagates permissions into named namespaces of every downstream cluster managed by the Rancher instance, but it was not subject to the privilege-escalation validation applied to the other permission-carrying fields of a GlobalRole. As a result, a non-administrative user could be granted, through a global role binding, permissions in downstream clusters that exceed the permissions that user already holds. This affected SUSE Rancher 2.15.2 only, and SUSE Rancher Webhook 0.11.0 up to 0.11.4, and 0.12.0 up to 0.12.1. | Nov 2, 2026 |
| CVE-2026-65059(opens NVD record) | Unscored | — | Furl versions through 3.15 for Perl allow memory exhaustion via unbounded decompression of HTTP responses. Furl inflates a response body sent with a gzip, x-gzip or deflate Content-Encoding and appends the output to the response string with no size limit. It does this whether or not the request asked for compression, and no option caps the decompressed size. Responses read with write_file or write_code are streamed rather than held in memory. A malicious server, or an attacker on a plain HTTP connection, can send a small compressed response that expands to exhaust the client's memory and end the process. | Nov 2, 2026 |
| CVE-2026-120596(opens NVD record) | High | 7.5 | A remotely exploitable denial-of-service vulnerability exists in the TCP options parser of the Nut/Net TCP/IP stack included in Nut/OS, developed by Ethernut/Egnite. Nut/OS releases up to version 5.1 are affected. An unauthenticated attacker can send a single TCP segment containing an unknown TCP option with a length byte of zero to any open TCP port on a vulnerable device. When processed, this malformed option triggers an infinite loop in the function NutTcpInputOptions, permanently blocking the TCP processing thread and rendering all TCP-based services unresponsive until the device is rebooted. | Nov 2, 2026 |
| CVE-2026-119301(opens NVD record) | High | 7.9 | Improper neutralization of quoting syntax in SQL identifier construction in the Apache Iceberg write component in AWS SDK for pandas (also published as awswrangler) 3.5.2 through 3.17.0 might allow an authenticated remote user with permission to modify AWS Glue Data Catalog metadata to read any table that a separate, more privileged principal can access and write to the table that principal is updating via a crafted column name. To remediate this issue, users should upgrade to version 3.17.1 or later. | Nov 2, 2026 |
| CVE-2026-106807(opens NVD record) | Unscored | — | A denial-of-service vulnerability exists in open5GS v2.8.0 in the PFCP transaction handling path. When the PFCP transaction or timer resource pool is exhausted, ogs_pfcp_xact_remote_create() returns NULL, but the failure is not handled properly and leads to an ogs_assert(new) failure in ogs_pfcp_xact_receive(). An attacker able to send PFCP messages to the affected SMF/UPF can exhaust transaction resources and cause the network function process to terminate with SIGABRT, resulting in service disruption and preventing further session establishment until the affected component is restarted. | Nov 2, 2026 |
| CVE-2026-106805(opens NVD record) | Unscored | — | A resource exhaustion issue exists in Free5GC v4.2.3 during PFCP Session Establishment failure handling. When the SMF does not receive a PFCP Session Establishment Response from the UPF, allocated UE IP address resources are not properly released. Repeated failed session establishment attempts can therefore exhaust the UE IP address pool, preventing new UEs from establishing PDU sessions and resulting in denial of service. | Nov 2, 2026 |
| CVE-2026-106804(opens NVD record) | High | 7.5 | A stack-based buffer overflow exists in Kamailio v6.1.3 and v6.1.4 in the ims_qos_npn module. The w_rx_aar_register() function copies the attacker-controlled host field from the SIP `Via` header into a fixed 46-byte stack buffer without validating its length. An unauthenticated remote attacker can trigger the vulnerability with a crafted SIP `REGISTER` request, causing stack corruption and termination of the affected Kamailio instance, resulting in denial of service. | Nov 2, 2026 |
| CVE-2026-106803(opens NVD record) | Critical | 9.8 | A stack-based buffer overflow exists in Kamailio v6.1.3 and v6.1.4 in the ims_registrar_pcscf module. When processing a crafted application/reginfo+xml NOTIFY message, process_contact() copies an attacker-controlled port value from the alias parameter into a fixed 5-byte stack buffer without validating its length. An unauthenticated remote attacker can trigger stack corruption and terminate the P-CSCF process, resulting in denial of service. | Nov 2, 2026 |
| CVE-2026-105769(opens NVD record) | Critical | 9.3 | kaniko before 1.25.20 can send a Microsoft Entra ID (Azure AD) access token for Azure Resource Manager to an attacker-controlled registry host. kaniko uses the Azure Container Registry credential helper github.com/chrismellard/docker-credential-acr-env, which decides whether a host is an ACR registry with an unanchored regular expression, so any hostname containing .azurecr.io, .azurecr.cn, .azurecr.de or .azurecr.us is accepted. kaniko consults this helper for any registry that has no credentials in the Docker config and is not a Google or Amazon ECR registry, before contacting the registry. A Dockerfile that references an image on a lookalike host, such as FROM x.azurecr.io.attacker.com/img or COPY --from=<image>, causes the helper to obtain a token from the build's Azure identity (service principal environment variables, federated workload identity token, or managed identity) and POST it to https://<host>/oauth2/exchange. The attacker can use the token against Azure Resource Manager with the identity's role assignments until it expires, and can exchange it for credentials to any ACR registry the identity can access. No RUN instruction or push is required. This issue is fixed in 1.25.20. | Nov 2, 2026 |
| CVE-2026-99242(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: ntfs: fix race between fallocate and mmap reads The fallocate implementation only takes invalidate_lock for punch hole, collapse range, and insert range operations. For standard allocation modes (mode == 0, FALLOC_FL_KEEP_SIZE), the lock is not held. During ntfs_attr_fallocate(), new clusters are mapped to the runlist via ntfs_attr_map_cluster() before being zeroed by ntfs_dio_zero_range(). This creates a window where concurrent mmap page faults can read uninitialized disk data. Since mmap uses filemap_fault() which takes invalidate_lock in shared mode, it can fault in pages during this window and expose old disk contents to userspace. This is an information leak and data integrity issue. Fix by taking invalidate_lock for all fallocate operations, not just for punch/collapse/insert modes. This prevents concurrent page faults from accessing unzeroed clusters during the allocation window. | Nov 2, 2026 |
| CVE-2026-99241(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: ntfs: take invalidate_lock in ntfs_filemap_page_mkwrite() ntfs_filemap_page_mkwrite() calls iomap_page_mkwrite() without holding mapping->invalidate_lock, so a concurrent truncate or fallocate can be in the middle of invalidating pagecache and rewriting the runlist while the write fault maps blocks and dirties the folio. This races with ntfs_attr_fallocate(), which merges clusters into the in-memory runlist, drops the runlist lock, and only afterwards zeroes the newly allocated clusters on disk; and with the punch-hole/insert/collapse paths that free clusters after truncating the cache. Per Documentation/filesystems/locking.rst, ->page_mkwrite() must ensure there are no truncate/invalidate races, "usually mapping->invalidate_lock is suitable for proper serialization". xfs takes its mmaplock (= the invalidate_lock rwsem) shared in exactly this path. Take invalidate_lock shared around iomap_page_mkwrite(). The read-only fault path is already covered because filemap_fault() itself grabs invalidate_lock shared on instantiation/read paths; only page_mkwrite was bypassing it in this driver. | Nov 2, 2026 |
| CVE-2026-99240(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: mm/damon/core: error damos_commit_quota_goal() for zero target_value Patch series "mm/damon: move zero damos quota target_value handling to the core layer". Having zero DAMOS quota target value can cause division by zero. DAMON API callers are checking the target value parameters to avoid that. It is easy to make mistakes in some of the multiple API callers. Move that to the core layer. Patch 1 adds the corner case handling into the core layer DAMON parameters validation logic. Patches 2 and 3 remove no more needed DAMON API callers side handling of the corner case in DAMON_LRU_SORT and DMON_SAMPLIE_MTIER, respectively. This patch (of 3): If a DAMOS scheme has a damos_quota_goal of zero target_value, damos_quota_goal() could trigger division-by-zero error. Hence each DAMON API callers should do the zero target_value validation. It is easy to make mistakes. Actually such bugs in DAMON_LRU_SORT and DAMON_SAMPLE_MTIER were found and fixed [1]. It is better to handle the corner case only once in the core layer, instead of multiple places in all DAMON API callers. One straightforward option is using an alternative denominator for the corner case in the damos_quota_goal(). However, the zero target_value is meaningless. In this case, the quota goal is always evaluated as achieved or over-achieved. The quota will only keep being reduced. Simply avoid using zero target_value by adding a check in the core layer DAMOS quota goal parameters validation/commit path, damos_commit_quota_goal(). Update it to return an error in the case. Also update its caller to propagate the error. | Nov 2, 2026 |
| CVE-2026-99239(opens NVD record) | High | 7.8 | In the Linux kernel, the following vulnerability has been resolved: Bluetooth: L2CAP: refuse __l2cap_chan_add if chan already has conn l2cap_chan may be linked to l2cap_conn at most once. This is assumed in several places, eg l2cap_chan_del cleanup. There is a TOCTOU race where the invariant is violated: [Task 1] [Task 2] l2cap_chan_connect l2cap_sock_bind l2cap_chan_lock lock_sock l2cap_state_change if (sk->sk_state != BT_OPEN) chan->state = BT_CONNECT l2cap_sock_state_change_cb chan->state = BT_BOUND sk->sk_state = BT_BOUND lock_sock <------------------ release_sock sk->sk_state = BT_CONNECT l2cap_sock_connect() does not check sk->sk_state, so since chan->state is now BT_BOUND, subsequent connect() ends up with second __l2cap_chan_add. Explicitly document and check the invariant in __l2cap_chan_add with WARN_ON_ONCE. The only callsite where it could be hit is l2cap_chan_connect, so add pre-check there to avoid relying on chan->state. chan->state read/write is not properly guarded currently so there can be other TOCTOUC problems. Add l2cap_lock_chan in l2cap_sock_bind() to guard chan->state write. | Nov 2, 2026 |
| CVE-2026-99238(opens NVD record) | High | 7.8 | In the Linux kernel, the following vulnerability has been resolved: tracing: Hold trace_types_lock when updating modules in persistent instances trace_module_record() walks ftrace_trace_arrays from the module notifier without trace_types_lock. A concurrent rmdir of an instance removes it from the list and frees it under that lock, so a module load or unload can walk into a freed trace_array. | Nov 2, 2026 |
| CVE-2026-99237(opens NVD record) | High | 7.8 | In the Linux kernel, the following vulnerability has been resolved: tracing: Hold trace_types_lock when resetting last boot data from readers update_last_data_if_empty() is called from tracing_open() with O_TRUNC, tracing_read_pipe() and tracing_buffers_read() without trace_types_lock. Two readers can both pass the LAST_BOOT test and free module_delta twice, and a module notifier can update module_delta while it is being freed. Take trace_types_lock in those paths and keep the callers that already hold it on an unlocked variant. | Nov 2, 2026 |
| CVE-2026-99236(opens NVD record) | High | 7.8 | In the Linux kernel, the following vulnerability has been resolved: tracing: Reject incomplete event filter expressions A non-empty expression normally finishes in predicate_parse()'s inner loop, which resolves the pending logical operators before jumping to finalization. If the input ends after an operator, possibly followed by unary '!' tokens, the outer loop instead falls through with unresolved operator state. For example, "common_pid == 1 || common_pid == 2 &&" leaves prog[0].target equal to -1. The second pass then reads prog[-1] before the forward-jump check can reject it. Depending on adjacent slab contents, it can also copy an out-of-bounds word into a branch target that passes the forward-only check. A self-targeted perf tracepoint counting event can reach this path through PERF_EVENT_IOC_SET_FILTER. Reject the outer-loop fallthrough when a predicate has already been parsed. This ensures that non-empty expressions only reach finalization after the inner loop has resolved their operators. Keep the existing no-filter error for input that has no predicates. Add a regression test for trailing logical operators and unary negations. | Nov 2, 2026 |
| CVE-2026-99235(opens NVD record) | High | 7.8 | In the Linux kernel, the following vulnerability has been resolved: tracing: Save the event file instead of the compatible histogram create_field_var_hist() creates a histogram on the matched event to supply a field variable, and records it on the target so it can be torn down later: hist_data = find_compatible_hist(target_hist_data, file); ... /* Save the compatible histogram information */ var_hist->hist_data = hist_data; hist_data is not the histogram it creates. It is one that was already there, whose keys the new one copies. The saved pointer has a single user, unregister_field_var_hists(), which runs when the target is removed: file = hist_data->field_var_hists[i]->hist_data->event_file; find_compatible_hist() matches on keys alone, so it can pick one with no variables of its own. check_var_refs() then returns false and the user can remove it while the target still points at it: BUG: KASAN: slab-use-after-free in event_hist_trigger_free+0x2b2/0x320 Read of size 8 at addr ffff8880093b90e0 by task init/1 Freed by task 1: kfree+0x154/0x420 event_hist_trigger_free+0x1d5/0x320 event_hist_trigger_parse+0x35f3/0x69e0 trigger_process_regex+0x1a6/0x250 Save the event file instead. It is all the dereference ever wanted, and it does not go away when the user removes a trigger. | Nov 2, 2026 |
| CVE-2026-99234(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: tracing: Unregister field variable histograms when the command fails An action that names a field on another event needs that field as a variable, so create_field_var_hist() registers a second hist trigger on that event to provide it, and records it in target_hist_data->field_var_hists[]. If a later part of the same command fails, create_actions() returns an error and event_hist_trigger_parse() jumps to out_free. The write fails with -EINVAL and sched_switch gets no trigger, but: # echo 'hist:keys=pid:ts0=common_timestamp.usecs' >> \ events/sched/sched_waking/trigger # echo 'my_synth u64 lat; int a; int b' >> synthetic_events # echo 'hist:keys=next_pid:wakeup_lat=common_timestamp.usecs-$ts0:\ onmatch(sched.sched_waking).my_synth($wakeup_lat,prio,nosuchfld)'\ >> events/sched/sched_switch/trigger # cat events/sched/sched_waking/trigger hist:keys=pid:vals=hitcount:ts0=common_timestamp.usecs:sort=hitcount:size=2048:clock=global [active] hist:keys=pid:vals=hitcount:synthetic_prio=prio:sort=hitcount:size=2048 [active] The second histogram is the one created for 'prio'. It is still active and still counting. out_free reaches destroy_field_var_hists(), which frees the field_var_hists[] entries, but never unregister_field_var_hists(), which is what removes the triggers and runs only from event_hist_trigger_free(). The entry is freed and the trigger is left with nothing tracking it. Unregister the field variable histograms in out_free as well, and record each one as soon as its trigger is registered rather than after the lookup that follows it, so no exit can leave a registered trigger untracked. The entry then belongs to field_var_hists[] and is released by destroy_field_var_hists(), so freeing it on that exit would be a double free. | Nov 2, 2026 |
| CVE-2026-99233(opens NVD record) | High | 7.8 | In the Linux kernel, the following vulnerability has been resolved: tracing/histograms: Verify event_call identity when updating synth_event refcount In event_hist_trigger_parse() and hist_unreg_all(), the histogram registration and unregistration paths look up find_synth_event() using trace_event_name(file->event_call) and adjust se->ref if a match is found. Because find_synth_event() only compares the event basename, registering or removing a histogram on a non-synthetic trace event whose basename matches a synthetic event erroneously modifies the synthetic event's reference count. If a histogram is registered on the non-synthetic event before the synthetic event is created and removed afterwards, se->ref is decremented without a matching increment, allowing the synthetic event to be freed while an active histogram action still holds a pointer to it. Introduce find_synth_event_call() to verify that &se->call matches file->event_call before adjusting se->ref. | Nov 2, 2026 |
| CVE-2026-99232(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: tracing/syscalls: Use copy_from_user for the faultable syscall buffer syscall_copy_user_array() copies the buffer argument of faultable syscalls (write, pwrite64, ...) with __copy_from_user(), which skips access_ok(). Use copy_from_user() instead so a non-user address is rejected and the entry is recorded as faulted. It could be a security concern for machines that trust perf a bit too much. | Nov 2, 2026 |
| CVE-2026-99231(opens NVD record) | High | 7.8 | In the Linux kernel, the following vulnerability has been resolved: io_uring/waitid: own the request before clearing ->head io_waitid_remove_wq() only takes the wait queue lock if ->head is set. io_waitid_wait() clears ->head first thing, before it tries to become the owner of the request by bumping ->refs. If somebody else owns the request at that point, nothing keeps it from completing the request while the wake up handler is still going to touch it: CPU0 (io_waitid_wait) CPU1 (io_waitid, holds a ref) list_del_init(&wait->entry) smp_store_release(&iw->head, NULL) __do_wait() finds another child io_waitid_remove_wq() // ->head == NULL, no locking io_waitid_finish(), IOU_COMPLETE // request freed and reused atomic_fetch_inc(&iw->refs) The same goes for __io_waitid_cancel() if it claims the request in that window. ->refs is part of the per opcode data of the request, so this increments whatever the next user of the request keeps there. If that happens to be zero, the handler concludes that it owns the request, and queues io_waitid_cb() for it. With the window held open by a delay, and the request reused for a receive that is waiting for data: BUG: KASAN: slab-use-after-free in __wake_up_common+0x1ca/0x1f0 __wake_up_sync_key+0x36/0x50 sock_def_readable+0xf1/0x420 unix_stream_sendmsg+0x60b/0x1110 Allocated by task 87: io_arm_apoll+0x1ed/0x940 Freed by task 87: __io_submit_flush_completions+0x118d/0x1a10 tctx_task_work_run+0x327/0x950 Only clear ->head once the handler owns the request. If it doesn't, the owner finds ->head set and has to wait for the lock, which is held by the caller of the handler. Deleting the already deleted entry again is harmless. | Nov 2, 2026 |
| CVE-2026-99230(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: io_uring/cmd: don't leave list poison in ->hash_node io_uring_cmd_del_cancelable() uses hlist_del() to take a command off ->cancelable_uring_cmd, which leaves LIST_POISON1/2 behind in ->hash_node. Requests are recycled through the request cache without being reinitialised, and not every user of ->hash_node sets it up before it is used: If a vectored futex wait is woken while futex_wait_multiple_setup() is still queueing the futexes, io_futexv_wait() doesn't add the request to ->futex_list, and leaves the completion to the task_work queued by the wake up. io_futexv_complete() ends in __io_futex_complete(), whose hlist_del_init() is fine for a request that is unhashed, which is how all other users of the node leave it. If the request was a cancelable uring_cmd in its previous life, e.g. a ublk FETCH_REQ, it writes through LIST_POISON2: Oops: general protection fault, probably for non-canonical address KASAN: maybe wild-memory-access in range [0xdead000000000120-...] RIP: 0010:io_futexv_complete+0x219/0x420 Call Trace: tctx_task_work_run+0x804/0x950 tctx_task_work+0x71/0xa0 task_work_run+0x118/0x200 Leave the node unhashed. | Nov 2, 2026 |
| CVE-2026-99229(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: io_uring/wait: don't spin on a stuck overflow list As long as IO_CHECK_CQ_OVERFLOW_BIT is set, io_cqring_wait_schedule() returns right away, before it gets to look at signals or arms the timeout, for io_cqring_wait() to flush the overflow list. If that doesn't empty the list, and the CQ ring doesn't hold the number of events the caller wants, the loop starts over, with the same result. The task spins in the kernel, and can't be killed. The assumption is that this can't happen: if CQEs can't be flushed, the ring is full, and min_events is capped to the size of the ring. But: - With IORING_SETUP_CQE_MIXED a 32b CQE needs two contiguous entries. It is stuck on the list if a single one is free, and then the ring holds less than cq_entries events. A single threaded application that asks for as many events as the ring has entries never gets out of io_uring_enter(). - Whether the ring is full is up to the CQ head, which the application can write to. While one thread waits for events on an empty ring, another one can move the head back so that the ring looks full and have a CQE overflow. The waiter can't be stopped any more, not even by SIGKILL. Only the application can make room in the CQ ring. Return to it if the list could not be flushed. | Nov 2, 2026 |
| CVE-2026-99228(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: io_uring/io-wq: don't lose the signal that ends work When a thread exits, only its tracked requests are cancelled. Then its io-wq is torn down. io_wq_exit_workers() signals every worker, to get it out of an interruptible sleep, and waits for all of them to exit. Before they do, they go through the work that is left. Unbounded work is cancelled. Bounded work is run, as it is expected to end by itself. Not all of it does. An open has no file yet, so it counts as bounded, and the open of a FIFO waits for the other end. That is what the signal is for. But the workers are signalled once, and a worker that hasn't started the work by then loses the signal: io_wq_exit_workers() io_worker_handle_work() io_wq_worker_wake() set TIF_NOTIFY_SIGNAL io_assign_current_work() io_run_task_work() clear TIF_NOTIFY_SIGNAL io_wq_submit_work() fifo_open() wait_for_partner() wait_for_completion_timeout() The thread never gets out of do_exit(): IORING_OP_OPENAT of a FIFO without a writer, IOSQE_ASYNC exit of the thread that has submitted it hangs in more than 9 of 10 attempts (4 CPUs, KVM), until the process is killed. Set TIF_NOTIFY_SIGNAL for bounded work that is started with IO_WQ_BIT_EXIT set. The bit is set before the workers are signalled, and it is tested after the flag has been cleared, with clear_notify_signal() providing the barrier. So either the flag stays, or the bit is seen. Work that is started while the io-wq exits is treated like work that is being run at that time: it isn't interrupted unless it waits interruptibly. | Nov 2, 2026 |
| CVE-2026-99227(opens NVD record) | High | 7.8 | In the Linux kernel, the following vulnerability has been resolved: io_uring/waitid: prevent cancel reference wrap io_waitid packs the cancellation state into bit 31 of ->refs and uses bits 30:0 as a 31-bit reference counter: #define IO_WAITID_CANCEL_FLAG BIT(31) #define IO_WAITID_REF_MASK GENMASK(30, 0) __io_waitid_cancel() marks a request canceled, then increments the low bits of ->refs to claim completion ownership. When another path owns the request, the increment remains even though cancellation returns false. The request remains discoverable by cancellation, so repeated failed attempts can wrap the 31-bit reference field to zero. A later cancellation can claim ownership and complete the request a second time. Use atomic_fetch_or() when setting the cancel flag and inspect the old flag value. The first cancel attempt continues to the existing ownership increment, preserving its wake and issuer handoff semantics. Later attempts see the cancel flag and return without incrementing the reference field. This makes repeated failed cancellation attempts idempotent while leaving the first-cancel state transitions unchanged. | Nov 2, 2026 |
| CVE-2026-99226(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: keys: Avoid the owner account dereference in named keyring lookup Named keyring lookup must keep the storage containing the owner UID alive through the namespace mapping check. find_keyring_by_name() reads keyring->user->uid under keyring_name_lock, but that lock protects the keyring's name entry and allocation, not its separate key_user. A named session-keyring join can overlap a privileged KEYCTL_CHOWN on another CPU. If the keyring holds the last reference to its old dynamic key_user and the ownership transfer succeeds, the following ordering is possible: Named join Chown find_keyring_by_name() keyctl_chown_key() read_lock(keyring_name_lock) down_write(key->sem) load old keyring->user replace key->user and key->uid up_write(key->sem) key_put(key) key_user_put(old user): free read old user->uid read_unlock(keyring_name_lock) Chown neither takes keyring_name_lock nor key_session_mutex, so it can free the old account between the pointer load and the UID read. The lookup then reads freed memory even though the keyring itself is alive. Use keyring->uid for the mapping check. key_alloc() initializes this inline owner UID and keyctl_chown_key() updates it on chown. The existing name lock keeps its containing keyring allocated throughout the check, so lookup no longer depends on the account's lifetime. This also matches the owner UID used by the permission check. KASAN report as below: BUG: KASAN: slab-use-after-free in find_keyring_by_name+0x577/0x5d0 Read of size 4 at addr ffff8881128ae2ec by task keycase/500 | Nov 2, 2026 |
| CVE-2026-99225(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: keys: Check the authorization payload in process keyring searches An authorization payload and its saved credentials must remain valid while search_process_keyrings_rcu() searches the requestor's keyrings. The function validates the authorization key, then separately loads payload.data[0] and unconditionally reads rka->cred. Validation does not prevent request_key_auth_revoke() from clearing the payload. A request-key helper can assume authority and fork a descendant that inherits the authorization key. If the descendant misses in its own keyrings, it falls back to the saved requestor credentials. Successful target instantiation invalidates the authorization key without clearing the payload. After the helper exits, UMH_WAIT_PROC returns to the requester, which calls complete_request_key() and revokes that key. With the descendant paused after validation, the paths can interleave as follows: 1. The descendant enters search_process_keyrings_rcu() under RCU and key_validate() succeeds. 2. The helper instantiates the target, invalidates the authorization key, and exits. 3. The requester resumes from UMH_WAIT_PROC, calls complete_request_key(), and revokes the authorization key. request_key_auth_revoke() sets its payload pointer to NULL. 4. The descendant loads NULL and dereferences rka->cred. This NULL dereference can oops the kernel. RCU delays payload disposal but does not prevent the pointer from being cleared. Load the payload with dereference_key_rcu() and require a non-NULL result before validating the authorization key and searching its saved credentials. A non-NULL payload and its credentials remain alive for the caller's RCU read-side section; a cleared payload skips the fallback search and follows the existing error selection. KASAN report as below: Oops: general protection fault, probably for non-canonical address 0xdffffc0000000005: 0000 [#1] SMP KASAN NOPTI KASAN: null-ptr-deref in range [0x0000000000000028-0x000000000000002f] RIP: 0010:search_process_keyrings_rcu+0x32b/0x790 | Nov 2, 2026 |
| CVE-2026-99224(opens NVD record) | High | 7.0 | In the Linux kernel, the following vulnerability has been resolved: keys: Protect the type name while describing a key keyctl_describe_key() must keep the key type's name alive until kasprintf() has consumed it. The retained key reference keeps the key and its description alive, but does not pin the module providing its type. The name is passed to kasprintf() without holding key->sem. kvasprintf() uses the saved name pointer in two formatting passes, with a GFP_KERNEL allocation between them. With AF_RXRPC=m, a task that passes View permission before type retirement can overlap a privileged module unload in this order: 1. KEYCTL_DESCRIBE looks up the key, saves key->type->name in the kasprintf() arguments and completes the first formatting pass. 2. While the formatter is delayed before its second pass, af_rxrpc_exit() calls unregister_key_type(), which removes the type from the registry and waits for key_gc_keytype(). 3. The collector takes key->sem for writing, retypes the retained key to key_type_dead and completes retirement. Unregistration and module exit return, allowing free_module() to release the type and name. 4. The formatter resumes its second pass and reads the saved name from released module storage, which can fault in string(). Hold key->sem for reading across kasprintf(). The collector then cannot retype the key or complete retirement until both formatting passes have finished. If retirement wins the lock first, formatting uses the core key_type_dead name instead. Release the semaphore immediately after kasprintf(), including on allocation failure, before copying to userspace. Oops report as below: BUG: unable to handle page fault for address: fffffbfff8054794 #PF: supervisor read access in kernel mode #PF: error_code(0x0000) - not-present page RIP: 0010:string+0x23f/0x470 Call Trace: vsnprintf+0x330/0x1110 | Nov 2, 2026 |
| CVE-2026-99223(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: keys: make keyring indexes independent of kernel addresses KEYCTL_READ returns the serial numbers in a keyring in associative-array traversal order. The first word of the index is a public, deterministic hash of the type pointer, domain pointer and description. An unprivileged user can therefore insert keys with known descriptions, predict their order for each possible KASLR slide, and recover the kernel image address. On an x86-64 build with 16 MiB alignment, 45 user keys suffice to distinguish the candidate slides. Remove the addresses from the whole index, not just its first hash word. Assign each key type and domain a nonzero 64-bit ID and hash those IDs and the description with a once-initialized SipHash key. Use the full IDs in the later index chunks as well. Truncating or hashing the IDs there would lose the guarantee that distinct type/domain/description tuples have a differing index bit. Allocate IDs lazily since private key types need not be registered. Cache them in the index key so tree walks and copies of an existing index do not need to dereference a type descriptor that may have been unregistered. Keep the 32-bit chunk layout and diff_objects() bit offsets consistent, and retain the separate root slot for keyrings used by recursive search. The key comparison, permissions and userspace data format are unchanged; only the address-dependent in-memory ordering is replaced. | Nov 2, 2026 |
| CVE-2026-99222(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: keys: Protect the read method check against type removal keyctl_read_key() checks key->type->read without holding key->sem. A reference keeps the key alive, but does not pin the module containing its type. A surviving RxRPC key can therefore be read while AF_RXRPC is being unloaded: KEYCTL_READ task Module unload and key GC ---------------- ------------------------ lookup_user_key() permission / possession checks load key->type af_rxrpc_exit() unregister_key_type() GC: down_write(key->sem) GC: retype to key_type_dead GC: up_write(key->sem) unregister_key_type() returns free_module() read saved type's read member The final access can read freed module storage. The read invocation in __keyctl_read_key() is already protected by key->sem, but the earlier method check is outside that critical section. Move the method check into __keyctl_read_key(), after key_validate() and under its existing read hold on key->sem. The check and invocation then use the same protected type for length queries and every read retry. The GC cannot retype the key until the semaphore is released, and type unregistration waits for that GC pass before the module can be freed. Return -EOPNOTSUPP when validation succeeds and the type has no read method. A temporary buffer may now be allocated before this result; allocation and copying to userspace remain outside the semaphore. | Nov 2, 2026 |
| CVE-2026-99221(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: keys/trusted_keys: return immediately after TPM unseal failure trusted_tpm_unseal() proceeds to pcrlock() when the TPM unseal operation fails. If pcrlock() succeeds, its return value overwrites the unseal error, causing key instantiation to succeed. Return immediately when unseal fails to preserve the original error. | Nov 2, 2026 |
| CVE-2026-99220(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: asymmetric_keys: reject trust keys without IDs The PKCS#8 parser deliberately leaves the asym_key_ids payload slot empty. key_or_keyring_common() unconditionally dereferences that slot when a PKCS#8 key is supplied to a key_or_keyring restriction. Both the plain and :chain forms reach this branch, allowing an unprivileged caller to trigger a NULL pointer dereference through KEYCTL_RESTRICT_KEYRING followed by add_key(). Oops: general protection fault, probably for non-canonical address 0xdffffc0000000000 KASAN: null-ptr-deref in range [0x0000000000000000-0x0000000000000007] RIP: 0010:key_or_keyring_common (crypto/asymmetric_keys/restrict.c:205 crypto/asymmetric_keys/restrict.c:279) Call Trace: <TASK> __key_create_or_update (security/keys/key.c:884) key_create_or_update (security/keys/key.c:1021) __do_sys_add_key (security/keys/keyctl.c:134) do_syscall_64 (arch/x86/entry/common.c:52 arch/x86/entry/common.c:83) entry_SYSCALL_64_after_hwframe (arch/x86/entry/entry_64.S:130) </TASK> Kernel panic - not syncing: Fatal exception Reject an asymmetric restriction key without key IDs. A PKCS#8 private key cannot identify the signer of a candidate certificate and is not a valid trust anchor. | Nov 2, 2026 |
| CVE-2026-99219(opens NVD record) | Unscored | — | In the Linux kernel, the following vulnerability has been resolved: ftrace: Initialize modname and offset in print_rec() print_rec() leaves 'modname' and 'offset' uninitialized and kallsyms_lookup() only sets them on success. When the lookup fails like when a module is being loaded or unloaded, 'modname' holds a garbage value, passes the 'if (modname)' check, and is dereferenced by seq_printf(). Oops: general protection fault RIP: 0010:string+0x48/0xe0 Call Trace: vsnprintf+0x1f5/0x650 seq_printf+0x8e/0xb0 print_rec+0x6c/0xc0 t_show+0x4c/0x440 seq_read_iter+0x119/0x480 This can be triggered by reading available_filter_functions while a module is being loaded or unloaded. Initialize both variables so a failed lookup skips the module name. | Nov 2, 2026 |
| CVE-2026-99218(opens NVD record) | High | 7.0 | In the Linux kernel, the following vulnerability has been resolved: coredump: hold RCU while releasing parked threads coredump_finish() releases the parked threads by clearing ->task in their core_thread entry and calling wake_up_process() on each of them. It does that without holding a reference on the task and without being inside rcu. But calling wake_up_process(task) without rcu here isn't safe. A parked thread doesn't need that wakeup to leave. A spurious wakeup or a preemption after the store is enough for the task to go away. So if the coredump client is preempted between the store and wake_up_process() the thread can exit and be freed in the meantime and try_to_wake_up() takes pi_lock in freed memory. Hold rcu across the loop. | Nov 2, 2026 |
| CVE-2026-99217(opens NVD record) | Unscored | — | Rejected reason: This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. | Nov 2, 2026 |
| CVE-2026-94290(opens NVD record) | Critical | 9.1 | SUSE Rancher Fleet clusters reference a kubeconfig secret that the controller uses to install and manage a Fleet agent on the target cluster. The controller did not sufficiently restrict which kubeconfig secrets a Fleet Cluster object was allowed to reference. As a result, a Fleet cluster defined in a namespace an ordinary user controls could be associated with administrative credentials for the management cluster itself, causing the controller to manage the management cluster on that user's behalf and to run that user's Fleet content there with elevated privileges. This affects SUSE Rancher Fleet 0.16.0 up to 0.16.3, 0.15.0 up to 0.15.8, 0.14.0 up to 0.14.12, 0.13.0 up to 0.13.17 and possible older versions. | Nov 2, 2026 |
| CVE-2026-88809(opens NVD record) | High | 7.6 | A security vulnerability exists in the SUSE Rancher Manager meta proxy endpoint (/meta/proxy). This endpoint is intended to forward requests only to destinations that appear on a configured allowlist. The allowlist decision was evaluated in a place where it could not stop a request from being forwarded, so a rejected destination was logged but the request was still handed to the proxy's transport. This affects SUSE Rancher 2.15.0 up to 2.15.3, 2.14.0 up to 2.14.7, 2.13.0 up to 2.13.11, 2.12.0 up to 2.12.15, 2.11.0 up to 2.11.19 and potentially older EOL versions. | Nov 2, 2026 |
| CVE-2026-77881(opens NVD record) | Medium | 5.5 | Control Web Panel (CWP) before webpanel_version 1.29 contains a blind SQL injection vulnerability in an unauthenticated loopback API route that connects to MySQL as root, where the 'user' parameter is interpolated directly into a query against the oauth_clients table. Attackers can send crafted requests to the unauthenticated route (originally /user_panel_dashboard/, later /valid_token/) to perform time-based blind SQL injection and extract arbitrary database contents. | Nov 2, 2026 |
| CVE-2026-77880(opens NVD record) | High | 7.8 | Control Web Panel (CWP) before webpanel_version 1.16 contains an OS command injection vulnerability in the loopback API password change route /newpass/, which runs as root. An attacker can inject arbitrary OS commands by manipulating the POST 'user' parameter that is passed unescaped into a shell command, achieving remote code execution with root privileges. | Nov 2, 2026 |
| CVE-2026-77879(opens NVD record) | High | 7.1 | Control Web Panel (CWP) before webpanel_version 1.16 contains a SQL injection vulnerability in the loopback API authentication gate access_token(), which connects to MySQL as root and interpolates attacker-controlled values directly into its query. Attackers can inject SQL through the authorization_code and client_id parameters to read arbitrary database contents and forge the authentication result, bypassing the API's authentication check. | Nov 2, 2026 |