Search: ye.call

OpenClaw CLI versions before 2026.2.23 have a vulnerability where Twilio webhook replay events could bypass the voice-call manager's deduplication mechanism. This happens because normalized event IDs were randomized on each parse, allowing replayed events to be treated as new and potentially causing duplicate or stale call-state transitions. The issue is fixed in version 2026.2.23 by preserving provider event IDs during normalization, adding bounded replay deduplication in webhook validation, and enforcing per-call turn-token checks.

OpenClaw CLI versions up to 2026.2.25 have a vulnerability in the voice-call Twilio webhook path where replay detection could be bypassed by manipulating an unsigned idempotency header. This allowed replayed webhook events to be accepted as fresh events. The issue is fixed in version 2026.2.26 by binding replay deduplication to authenticated request identity rather than mutable unsigned headers.

Mojolicious versions from 4.59 up to but not including 9.48 for Perl expose a stable session CSRF token representation that can be exploited via a BREACH compression oracle attack. The vulnerability arises because the _csrf_token method generates and caches a single token per session, returning the same token on every call, which is placed in a hidden csrf_token input field. When responses containing this token also include attacker-controlled input and are gzip-compressed, an attacker can use compression length differences to recover the CSRF token and bypass csrf_protect validation. This vulnerability is critical and has a CVSS score of 9.1. A patch is available in version 3.36_3.

Deserialization of Untrusted Data vulnerability in ash-project ash allows an unauthenticated attacker to inject a filter expression through a forged keyset pagination cursor, resulting in SQL injection or code execution depending on the data layer. Read actions with keyset pagination decode the client-supplied page[:after] or page[:before] cursor in decode_values/2 in lib/ash/page/keyset.ex using non_executable_binary_to_term/2 with [:safe]. That guard blocks new atoms, funs, and ports, but not a struct built from atoms already interned in a running Ash application, so a decoded %Ash.Query.Call{} expression survives and is spliced into the keyset filter as a comparison value in do_filters/4 and evaluated. Because the cursor bypasses the Ash.Expr macro, the runtime never applies the private?/public? gate that would otherwise reject it. On AshPostgres the injected fragment is inlined into the SQL query; on the ETS and Simple data layers it is evaluated in-process as an arbitrary function call. This issue affects ash: from 1.17.0 before 3.31.3.

**CVE:** This vulnerability corresponds to [CVE-2026-72809](https://nvd.nist.gov/vuln/detail/CVE-2026-72809). ### Summary The kernel's `CheckAuth` grants `RoleAdministrator` to any request whose `RemoteAddr` is loopback (`127.0.0.1`), for a specific set of endpoints, and these localhost bypasses sit **outside** the `accessAuthCode` gate so they apply even when an access auth code is configured. This is demonstrated live (Part A below). Separately, the fixed-port reverse proxy (`fixedport.go`) forwards requests to the kernel over loopback and injects no authentication token, and no `SetTrustedProxies` is configured, so gin does not derive the client address from forwarding headers. By code inspection, a request forwarded through this proxy would reach the kernel with `RemoteAddr = 127.0.0.1`. **If** the fixed-port proxy is bound to a network interface (via `NetworkServe`) and forwards remote requests to the kernel this way, the localhost bypass would grant a remote unauthenticated caller admin on those endpoints. This second step is established by reading the code but was **not reproduced end-to-end**, and I'm asking the maintainer to confirm the proxy's runtime forwarding behavior (Part B below). ### Details **Localhost-trust admin bypass (proven).** `CheckAuth` (`session.go:298-321`) contains localhost-only bypasses that key off `RemoteAddr` and grant `RoleAdministrator`. They sit outside the `accessAuthCode` gate i.e. they apply even when an access auth code is set and cover `/api/system/exit`, `getNetwork`, `getWorkspaceInfo`, `/assets/*`, and `/export/*`. **Fixed-port proxy behavior (code inspection).** `fixedport.go` is a plain reverse proxy that dials the kernel at `127.0.0.1` and injects no token unlike the publish proxy, which injects a `RoleReader` JWT. There is no `SetTrustedProxies` call, so gin does not rewrite `RemoteAddr` from `X-Forwarded-For`. On this reading, a request forwarded through the fixed-port proxy reaches the kernel with `RemoteAddr = 127.0.0.1`. **The composition (conditional).** If both hold at runtime, then: remote request → fixed-port proxy on a network interface → forwarded to kernel at `127.0.0.1` (no token) → kernel sees `RemoteAddr = 127.0.0.1` → localhost bypass grants admin for the endpoints above. I have proven the final link (localhost → admin) and read the code for the forwarding link, but have not confirmed at runtime that the fixed-port proxy is instantiated and forwards remote requests as loopback in a shipped configuration. **Distinct from the previously-dismissed localhost→admin observation.** That observation concerned the *publish* proxy path, where the injected `RoleReader` JWT causes `CheckAuth` to early-return before reaching the localhost bypasses. The fixed-port proxy injects no token, so a request through it would fall through to the `RemoteAddr`-keyed bypass instead. Different proxy, different code path. ### Proof of Concept **Part A: the localhost bypass grants admin without auth, outside the auth-code gate (demonstrated live).** On a local instance with an access auth code configured, the same no-token `getWorkspaceInfo` request returns different results depending on the source address the kernel sees: - From a non-loopback source (kernel sees a non-127.0.0.1 address): `HTTP 401`. - From `127.0.0.1` (kernel sees loopback): `{"code":0,"data":{"workspaceDir":"/siyuan/workspace",…}}` admin data, no auth, despite `accessAuthCode` being set. This confirms the localhost-trust bypass grants admin for these endpoints and is not gated by the access auth code. **Part B: remote → proxy → loopback (code inspection only; NOT reproduced).** By reading `fixedport.go`, the proxy dials `127.0.0.1`, injects no token, and no `SetTrustedProxies` is set. I was not able to reproduce this end-to-end: the `serve` CLI in the container image tested exposes only `--port` and `--accessAuthCode`, not a flag that instantiates the fixed-port proxy in the `NetworkServe`-on-a-non-default-port shape, so the remote→proxy→loopback chain was not exercised at runtime. I did not invoke the destructive `/api/system/exit` endpoint. **I'm asking the maintainer to confirm: under what conditions is the fixed-port proxy instantiated, does it bind a non-loopback interface under `NetworkServe`, and does it forward to the kernel preserving the client address or as loopback?** That determines whether Part A's bypass is remotely reachable. ### Impact **Confirmed (Part A):** on any deployment where a caller can cause the kernel to see a loopback `RemoteAddr`, the endpoints `/api/system/exit`, `getNetwork`, `getWorkspaceInfo`, `/assets/*`, and `/export/*` are reachable with admin rights without the access auth code i.e. the auth code does not protect these endpoints against a loopback-sourced caller. On its own this is a local/adjacent bypass of the access-code control for those endpoints. If the fixed-port proxy forwards remote requests to the kernel as loopback (to be confirmed by the ma

**CVE:** This vulnerability corresponds to [CVE-2026-72795](https://nvd.nist.gov/vuln/detail/CVE-2026-72795). ### Summary `/api/block/getBlockDOMWithEmbed` and `/api/block/getBlockDOMsWithEmbed` gate only the *requested* block against publish access. The blocks pulled in by that block's embed (transclusion) query are inlined into the returned DOM with no publish-access check at all, so a reader who requests a legitimately-published block containing an embed query receives the content of every block that query matched including blocks in hidden, forbidden and password-protected documents. The dedicated embed endpoint `getEmbedBlock` filters these same results for reader roles. The DOM-with-embed path does not. ### Details | Item | Detail | |---|---| | Routes | `kernel/api/router.go:226` `POST /api/block/getBlockDOMWithEmbed` → `model.CheckAuth` → `getBlockDOMWithEmbed`; `:227` `POST /api/block/getBlockDOMsWithEmbed` → `model.CheckAuth` → `getBlockDOMsWithEmbed` | | Middleware | `CheckAuth` only — no `CheckReadonly`, no `CheckAdminRole` → reachable by the publish `RoleReader` token, and anonymously when `Publish.Auth.Enable` is `false` | | Guard present | Top-level requested block only. Singular: password + disable checks on the requested id. Plural: `filterBlockDOMsByPublishAccess` over the requested ids. | | Guard absent | The embedded blocks resolved from the query | | Exposed | Content HTML of every block matched by the embed query, regardless of that block's publish visibility or password tier | **The leak path.** `getBlockDOMWithEmbed` → `GetBlockDOMsWithEmbedInBox` → `resolveEmbedContentInBox` (`kernel/model/block.go:976`). That function walks the tree for `NodeBlockQueryEmbed`, extracts the embed SQL, executes `sql.SelectBlocksRawStmtInBox(stmt, ...)`, builds `embedContents` from each matched block's content HTML, and inlines the result via `SetIALAttr("embed-content", ...)`. `resolveEmbedContentInBox` takes no `publishAccess` parameter and contains no filtering: `FilterEmbedBlocks`, `CheckBlockIdAccessableByPublishAccess`, `CheckPathAccessable`, `publishAccess` and `IsReadOnlyRoleContext` all return zero matches in that function and its call path. The top-level gate therefore passes on the requested block, and the response body carries content the reader has no access to. Embed queries in published documents routinely span the entire workspace by design, dashboard documents, "all my TODOs" aggregations, tag or attribute rollups. The reader does not need to construct anything: requesting an already-published document that contains such an embed is sufficient. If the publish frontend renders embedded blocks through this endpoint, the disclosure occurs passively during normal viewing of any published document containing an embed block. **Guarded sibling.** `getEmbedBlock` (`kernel/api/router.go:212`), which is also reader-reachable and returns embed query results, applies `model.FilterEmbedBlocksByPublishAccess(c, publishAccess, blocks)` for reader roles (`kernel/model/search.go:38`). The same class of data is filtered there and unfiltered here. **Scope note.** A prior review of `getBlockDOMsWithEmbed` confirmed that the per-id publish gate is correctly applied to the *requested* ids. That observation is accurate and is not in dispute, this report concerns the *embedded* blocks resolved downstream in `resolveEmbedContentInBox`, which are not covered by that gate. ### Proof of Concept Precondition: publish mode enabled (default port 6808); anonymous when `Publish.Auth.Enable` is `false`, otherwise any publish reader account. A published document containing an embed query whose results include at least one block in a non-published or password-protected document. ``` POST http://127.0.0.1:6808/api/block/getBlockDOMWithEmbed {"id":"<id of a published block containing an embed query>"} → 200 The returned DOM contains embed-content attributes carrying the content HTML of blocks in documents the reader has no publish access to. ``` Differential check against the filtered sibling, using the same reader session and the same underlying query: ``` POST http://127.0.0.1:6808/api/search/getEmbedBlock {"stmt":"<the same embed query>"} → 200, results filtered by FilterEmbedBlocksByPublishAccess ``` The filtered endpoint withholds the private blocks; the DOM endpoint returns their content. The plural route behaves identically for each requested id: ``` POST http://127.0.0.1:6808/api/block/getBlockDOMsWithEmbed {"ids":["<published block containing an embed query>"]} ``` ### Impact An anonymous reader in publish mode or any publish `RoleReader` can read the content of blocks in documents that are not published, are marked hidden or forbidden, or are protected by a publish password, by requesting a published block that transcludes them. Because embed queries in aggregation-style published documents commonly match across the whole workspace, the volume of exposed content is bounded only by wh

A new NFC relay malware family called WindRelay has been discovered operating in combination with SpyNote RAT to enable sophisticated contactless payment fraud. The scheme uses live social engineering phone calls where fraudsters impersonate bank employees and guide victims to install personalized RAT malware labeled with the victim's own name. Once installed, the RAT enables silent deployment of WindRelay, which captures contactless payment card data via NFC when victims tap their cards to their phones. The captured data is relayed in real-time to fraudster-controlled terminals for immediate cash-out through physical purchases or ATM withdrawals. The operation employs dual monetization, combining RAT-driven digital loan fraud with NFC-based card-present transactions. Group-IB identified 23 WindRelay samples targeting victims in Czechia, Slovakia, and Slovenia between November 2025 and July 2026.

Malware#windrelay#android banking trojanCzechia+3

In the Linux kernel, the following vulnerability has been resolved: usb: gadget: f_tcm: synchronize delayed set_alt with teardown The f_tcm set_alt() path defers endpoint setup to a work item and completes the delayed status response from process context. The delayed work uses f_tcm private state and may complete the setup request after disconnect or function teardown has already moved on. Cancel and drain the delayed set_alt work when the function is unbound or freed. For disable paths, which are reached under the composite device lock, use a small state machine and a non-sleeping cancellation path instead of cancel_work_sync(). If the work is already running, mark it cancelled and let the worker own the cleanup; otherwise tcm_disable() can cancel the queued work and clean up immediately. Also serialize the final delayed-status completion with the cancellation check while holding the composite device lock. This prevents a disconnect from clearing delayed_status while the worker is about to complete the control request. Validation reproduced this kernel report: BUG: KASAN: slab-use-after-free in tcm_delayed_set_alt+0x6c/0xef0 Call Trace: <TASK> dump_stack_lvl+0x66/0xa0 print_report+0xce/0x630 ? tcm_delayed_set_alt+0x6c/0xef0 ? srso_alias_return_thunk+0x5/0xfbef5 ? __virt_addr_valid+0x188/0x320 ? tcm_delayed_set_alt+0x6c/0xef0 kasan_report+0xe0/0x110 ? tcm_delayed_set_alt+0x6c/0xef0 tcm_delayed_set_alt+0x6c/0xef0 ? __pfx_tcm_delayed_set_alt+0x10/0x10 ? process_one_work+0x4cb/0xb90 ? rcu_is_watching+0x20/0x50 ? tcm_delayed_set_alt+0x9/0xef0 process_one_work+0x4d7/0xb90 ? __pfx_process_one_work+0x10/0x10 ? srso_alias_return_thunk+0x5/0xfbef5 ? __list_add_valid_or_report+0x37/0xf0 ? __pfx_tcm_delayed_set_alt+0x10/0x10 ? srso_alias_return_thunk+0x5/0xfbef5 worker_thread+0x2d8/0x570 ? __pfx_worker_thread+0x10/0x10 kthread+0x1ad/0x1f0 ? __pfx_kthread+0x10/0x10 ret_from_fork+0x3c9/0x540 ? __pfx_ret_from_fork+0x10/0x10 ? srso_alias_return_thunk+0x5/0xfbef5 ? __switch_to+0x2e9/0x730 ? __pfx_kthread+0x10/0x10 ret_from_fork_asm+0x1a/0x30 </TASK> Allocated by task 544: kasan_save_stack+0x33/0x60 kasan_save_track+0x14/0x30 __kasan_kmalloc+0x8f/0xa0 tcm_alloc+0x68/0x180 usb_get_function+0x36/0x60 config_usb_cfg_link+0x125/0x1b0 configfs_symlink+0x322/0x890 vfs_symlink+0xc2/0x270 filename_symlinkat+0x295/0x2f0 __x64_sys_symlinkat+0x62/0x90 do_syscall_64+0x115/0x6a0 entry_SYSCALL_64_after_hwframe+0x77/0x7f Freed by task 661: kasan_save_stack+0x33/0x60 kasan_save_track+0x14/0x30 kasan_save_free_info+0x3b/0x60 __kasan_slab_free+0x43/0x70 kfree+0x2f9/0x530 config_usb_cfg_unlink+0x173/0x1e0 configfs_unlink+0x1fa/0x340 vfs_unlink+0x15c/0x510 filename_unlinkat+0x2ba/0x450 __x64_sys_unlinkat+0x63/0x90 do_syscall_64+0x115/0x6a0 entry_SYSCALL_64_after_hwframe+0x77/0x7f

In the Linux kernel, the following vulnerability has been resolved: media: rtl2832: fix use-after-free in rtl2832_remove() cancel_delayed_work_sync() is called before i2c_mux_del_adapters() in rtl2832_remove(). While the cancel waits for any running instance of i2c_gate_work to finish, it does not prevent the timer from being rescheduled by a concurrent thread. During probe, the r820t_attach() call attempts I2C transfers through the mux adapter. These transfers go through i2c_mux_master_xfer(), which calls rtl2832_deselect() after the transfer completes, rescheduling i2c_gate_work via schedule_delayed_work(). If this transfer is still in flight when rtl2832_remove() runs, rtl2832_deselect() can reschedule i2c_gate_work after it has been cancelled, causing a use-after-free when kfree(dev) is called. Fix this by calling i2c_mux_del_adapters() before cancel_delayed_work_sync(). Once the mux adapter is unregistered, no new I2C transfers can go through it, so rtl2832_deselect() can no longer reschedule i2c_gate_work. The subsequent cancel_delayed_work_sync() is then guaranteed to be final.

In the Linux kernel, the following vulnerability has been resolved: drm/xe/vf: Add drm_dev guards when detaching CCS read/write buffers CCS read/write buffers are freed during BO destruction. In some cases, BOs may be destroyed after the device is unbound but while the DRM structure remains valid, leading to NULL pointer dereferences when accessing device resources. BUG: kernel NULL pointer dereference, address: 0000000000000000 PGD 0 P4D 0 Oops: Oops: 0000 [#1] SMP NOPTI CPU: 0 UID: 0 PID: 9376 Comm: xe_pat Not tainted 7.2.0-rc2+ #1 PREEMPT(lazy) RIP: 0010:xe_sriov_vf_ccs_rw_update_bb_addr+0x4d/0xa0 [xe] RSP: 0018:ffffcf304110b9c8 EFLAGS: 00010246 RAX: ffff8a85c38a0a00 RBX: 00000000810ef000 RCX: 0000000000000000 RDX: 0000000000000000 RSI: 0000000000000000 RDI: ffff8a85c39c1888 RBP: ffffcf304110b9e8 R08: 0000000000000000 R09: 0000000000000000 R10: 0000000000000000 R11: 0000000000000000 R12: ffff8a85c39c1888 R13: 0000000000000000 R14: ffff8a85c39b4f28 R15: ffff8a85c3885000 FS: 0000000000000000(0000) GS:ffff8a878b809000(0000) knlGS:0000000000000000 CS: 0010 DS: 0000 ES: 0000 CR0: 0000000080050033 CR2: 0000000000000000 CR3: 000000010314a002 CR4: 0000000000772ef0 PKRU: 55555554 Call Trace: <TASK> xe_migrate_ccs_rw_copy_clear+0x98/0x120 [xe] xe_sriov_vf_ccs_detach_bo+0x2c/0x60 [xe] xe_ttm_bo_delete_mem_notify+0xc8/0xe0 [xe] ttm_bo_cleanup_memtype_use+0x26/0x80 [ttm] ttm_bo_release+0x29e/0x2d0 [ttm] ttm_bo_fini+0x39/0x70 [ttm] xe_gem_object_free+0x1f/0x30 [xe] drm_gem_object_free+0x1d/0x40 ttm_bo_vm_close+0x5f/0x90 [ttm] remove_vma+0x2c/0x70 tear_down_vmas+0x63/0xf0 exit_mmap+0x20d/0x3f0 __mmput+0x45/0x170 mmput+0x31/0x40 do_exit+0x2ba/0xac0 do_group_exit+0x2d/0xb0 __x64_sys_exit_group+0x18/0x20 x64_sys_call+0x14a0/0x2390 do_syscall_64+0xdd/0x640 ? count_memcg_events+0xea/0x240 ? handle_mm_fault+0x1ec/0x2f0 (cherry picked from commit 1ae415a6eefe5004954a1d352b1718faca8844ef)

In the Linux kernel, the following vulnerability has been resolved: rds: drop incoming messages that cross network namespace boundaries rds_find_bound() looks up the destination socket using a global rhashtable keyed solely on (addr, port, scope_id). Network namespaces are not part of the key, so a sender in netns A can deliver an incoming message (inc) to a socket that lives in a different netns B. When this happens, inc->i_conn points to an rds_connection whose c_net is netns A, but the receiving rs lives in netns B. Once the child process that created netns A exits, cleanup_net() calls rds_loop_exit_net() -> rds_loop_kill_conns() -> rds_conn_destroy(), freeing that connection. If the survivor socket in netns B still holds the inc, any subsequent dereference of inc->i_conn is a use-after-free. There are two dangerous sites in rds_clear_recv_queue(): 1. inc->i_conn->c_lcong (offset 88 of freed rds_connection, size 200) read via rds_recv_rcvbuf_delta() -- confirmed by KASAN. 2. inc->i_conn->c_trans->inc_free(inc) (function pointer at offset 80) called via rds_inc_put() when the inc refcount reaches zero -- same race window, potential call-through-freed-object primitive. The bug is reachable from unprivileged user namespaces (CLONE_NEWUSER + CLONE_NEWNET), available since Linux 3.8. Fix this by rejecting the delivery in rds_recv_incoming() when the socket returned by rds_find_bound() belongs to a different network namespace than the connection that carried the message. Use the existing rds_conn_net() / sock_net() helpers and net_eq() for the comparison.

In the Linux kernel, the following vulnerability has been resolved: audit: fix recursive locking deadlock in audit_dupe_exe() A deadlock occurs in the audit subsystem when duplicating executable-related rules. When a file is moved (e.g., via do_renameat2()), the VFS layer locks the parent directory (I_MUTEX_PARENT), which synchronously triggers an fsnotify_move event. If an existing executable audit rule matches the file being moved, the audit subsystem catches this event and calls audit_dupe_exe() to duplicate the watch and update the rule. Then, audit_alloc_mark() would call kern_path_parent() to resolve the path, leading to a blind attempt to acquire the exact same I_MUTEX_PARENT lock already held by the task, resulting in the following recursive locking deadlock: ============================================ WARNING: possible recursive locking detected 6.12.0-55.27.1.el10_0.x86_64+debug #1 Not tainted -------------------------------------------- mv/5099 is trying to acquire lock: ffff888132845358 (&inode->i_sb->s_type->i_mutex_dir_key/1){+.+.}-{3:3}, at: __kern_path_locked+0x10a/0x2f0 but task is already holding lock: ffff888132846b58 (&inode->i_sb->s_type->i_mutex_dir_key/1){+.+.}-{3:3}, at: lock_two_directories+0x13f/0x2b0 other info that might help us debug this: Possible unsafe locking scenario: CPU0 ---- lock(&inode->i_sb->s_type->i_mutex_dir_key/1); lock(&inode->i_sb->s_type->i_mutex_dir_key/1); *** DEADLOCK *** May be due to missing lock nesting notation 6 locks held by mv/5099: #0: ffff888112a9c440 (sb_writers#13) at: do_renameat2+0x34c/0xbc0 #1: ffff888112a9c790 (&type->s_vfs_rename_key#3) at: do_renameat2+0x415/0xbc0 #2: ffff888132846b58 (&inode->i_sb->s_type->i_mutex_dir_key/1) at: lock_two_directories+0x13f/0x2b0 #3: ffff888132845358 (&inode->i_sb->s_type->i_mutex_dir_key/5) at: lock_two_directories+0x175/0x2b0 #4: ffffffffb3a1fb10 (&fsnotify_mark_srcu) at: fsnotify+0x454/0x28a0 #5: ffffffffaf886230 (audit_filter_mutex) at: audit_update_watch+0x36/0x11e0 stack backtrace: Call Trace: <TASK> dump_stack_lvl+0x6f/0xb0 print_deadlock_bug.cold+0xbd/0xca validate_chain+0x83a/0xf00 __lock_acquire+0xcac/0x1d20 lock_acquire.part.0+0x11b/0x360 down_write_nested+0x9f/0x230 __kern_path_locked+0x10a/0x2f0 kern_path_locked+0x26/0x40 audit_alloc_mark+0xfb/0x4f0 audit_dupe_exe+0x6c/0xe0 audit_dupe_rule+0x6c2/0xc00 audit_update_watch+0x4cc/0x11e0 audit_watch_handle_event+0x12c/0x1b0 send_to_group+0x5d0/0x8b0 fsnotify+0x615/0x28a0 fsnotify_move+0x1d8/0x630 vfs_rename+0xdcd/0x1df0 do_renameat2+0x9d4/0xbc0 __x64_sys_renameat+0x192/0x260 do_syscall_64+0x92/0x180 entry_SYSCALL_64_after_hwframe+0x76/0x7e RIP: 0033:0x7f0491fe8c4e Code: 0f 1f 40 00 48 8b 15 c1 e1 16 00 f7 d8 64 89 02 b8 ff ff ff ff c3 66 0f 1f 44 00 00 f3 0f 1e fa 49 89 ca b8 08 01 00 00 0f 05 <48> 3d 00 f0 ff ff 77 0a c3 66 0f 1f 84 00 00 00 00 00 48 8b 15 89 RSP: 002b:00007ffc7210bf38 EFLAGS: 00000246 ORIG_RAX: 0000000000000108 RAX: ffffffffffffffda RBX: 0000000000000000 RCX: 00007f0491fe8c4e RDX: 0000000000000003 RSI: 00007ffc7210e6c8 RDI: 00000000ffffff9c RBP: 0000000000000000 R08: 0000000000000000 R09: 0000000000000001 R10: 00005575eb2dae2a R11: 0000000000000246 R12: 00005575eb2dae2a R13: 00007ffc7210e6c8 R14: 0000000000000003 R15: 00000000ffffff9c </TASK> The aforementioned deadlock can be consistently reproduced by running the script below: audit-dupe-exe-deadlock.sh -------------------------- #!/bin/bash auditctl -D mkdir -p /tmp/foo touch /tmp/file auditctl -a always,exit -F exe=/tmp/file -F path=/tmp/file -S all -k dr mv /tmp/file /tmp/foo/file rm -Rf /tmp/foo This patch fixes the issue by introducing struct audit_watch_ctx to pass the fsnotify event context down to audit_alloc_mark(). By utilizing the already-resolved directory inode provided by the event, we bypass the kern_path_parent() path resol ---truncated---

In the Linux kernel, the following vulnerability has been resolved: super: fix emergency thaw deadlock on frozen block devices do_thaw_all_callback() calls bdev_thaw() while holding sb->s_umount exclusively. If the block device was frozen via bdev_freeze() dropping the last block layer freeze reference calls fs_bdev_thaw() which reacquires s_umount: do_thaw_all_callback(sb) super_lock_excl(sb) # holds sb->s_umount bdev_thaw(sb->s_bdev) mutex_lock(&bdev->bd_fsfreeze_mutex) # bd_fsfreeze_count drops 1 -> 0 bd_holder_ops->thaw == fs_bdev_thaw get_bdev_super(bdev) bdev_super_lock(bdev, true) super_lock(sb, true) down_write(&sb->s_umount) # same task: deadlock The emergency thaw worker deadlocks against itself holding both s_umount and bd_fsfreeze_mutex. That fscks any subsequent unmount, freeze, or thaw of that filesystem and block device. [ 81.878470] sysrq: Show Blocked State [ 81.880140] task:kworker/0:1 state:D stack:0 pid:11 tgid:11 ppid:2 task_flags:0x4208060 flags:0x00080000 [ 81.884876] Workqueue: events do_thaw_all [ 81.886656] Call Trace: [ 81.887759] <TASK> [ 81.888763] __schedule+0x579/0x1420 [ 81.890372] schedule+0x3a/0x100 [ 81.891794] schedule_preempt_disabled+0x15/0x30 [ 81.893848] rwsem_down_write_slowpath+0x1ea/0x900 [ 81.895191] ? __pfx_do_thaw_all_callback+0x10/0x10 [ 81.896528] down_write+0xbd/0xc0 [ 81.897505] super_lock+0x91/0x180 [ 81.898457] ? __mutex_lock+0xa99/0x1140 [ 81.900748] ? __mutex_unlock_slowpath+0x1f/0x400 [ 81.902069] bdev_super_lock+0x5b/0x150 [ 81.903132] get_bdev_super+0x10/0x60 [ 81.904042] fs_bdev_thaw+0x23/0xf0 [ 81.904755] bdev_thaw+0x82/0x100 [ 81.905484] do_thaw_all_callback+0x2c/0x50 [ 81.906298] __iterate_supers+0x5d/0x130 [ 81.907067] do_thaw_all+0x20/0x40 [ 81.907739] process_one_work+0x206/0x5e0 [ 81.908545] worker_thread+0x1e2/0x3c0 [ 81.909339] ? __pfx_worker_thread+0x10/0x10 [ 81.910171] kthread+0xf4/0x130 [ 81.910799] ? __pfx_kthread+0x10/0x10 [ 81.911528] ret_from_fork+0x2e2/0x3b0 [ 81.912259] ? __pfx_kthread+0x10/0x10 [ 81.913010] ret_from_fork_asm+0x1a/0x30 [ 81.913806] </TASK> bdev_super_lock() even documents the violated requirement with lockdep_assert_not_held(&sb->s_umount). Acquiring bd_fsfreeze_mutex under s_umount also inverts the bd_fsfreeze_mutex vs. s_umount ordering established by bdev_{freeze,thaw}() and can thus ABBA against a concurrent block-layer freeze even when the recursive path isn't hit. Fix this by not holding s_umount around the bdev_thaw() loop at all. Pin the superblock with an active reference instead as filesystems_freeze_callback() does. The active reference keeps the superblock from being shut down and so ->s_bdev stays valid without holding s_umount. The block-layer-held freeze is dropped by fs_bdev_thaw() with FREEZE_MAY_NEST | FREEZE_HOLDER_USERSPACE exactly as a regular unfreeze would and thaw_super_locked() handles filesystem-level freezes as before. The emergency thaw path has deadlocked like this in one form or another for a long long time but the current exclusively-held shape dates back to commit [1] where thaw_bdev() already ended in thaw_super() with s_umount held by do_thaw_all_callback().

In the Linux kernel, the following vulnerability has been resolved: net/mlx5e: Use sender devcom for MPV master-up After PCIe DPC recovery, mlx5 reloads the affected functions and replays multiport affiliation events. In the reported failure, the first relevant device error was: pcieport 0000:10:01.1: DPC: containment event pcieport 0000:10:01.1: PCIe Bus Error: severity=Uncorrected (Fatal) pcieport 0000:10:01.1: [ 5] SDES (First) mlx5 recovered the PCI functions and resumed 0000:11:00.1. During that resume, RDMA multiport binding replayed MLX5_DRIVER_EVENT_AFFILIATION_DONE and mlx5e sent MPV_DEVCOM_MASTER_UP. The host then panicked with: BUG: kernel NULL pointer dereference, address: 0000000000000010 RIP: mlx5_devcom_comp_set_ready+0x5/0x40 [mlx5_core] RDI: 0000000000000000 Call trace included: mlx5_devcom_comp_set_ready mlx5e_devcom_event_mpv mlx5_devcom_send_event mlx5_ib_bind_slave_port mlx5r_mp_probe mlx5_pci_resume MPV devcom registration publishes mlx5e private data to the component peer list before mlx5e_devcom_init_mpv() stores the returned component device in priv->devcom. A concurrent master-up event can therefore reach a peer whose private data is visible but whose priv->devcom backpointer is still NULL. MPV_DEVCOM_MASTER_UP already carries the sender/master mlx5e private data as event_data. The ready bit is stored on the shared devcom component, not on an individual peer. Use the sender devcom when marking the MPV component ready. This preserves the readiness transition while avoiding a NULL dereference of the peer devcom pointer during affiliation replay after PCI error recovery.

In Bouncy Castle for Java FIPS (BC-FJA) before bc-fips 2.1.3, the native entropy source used on Intel platforms retried the CPU entropy instructions without any bound. RDSEED and RDRAND report failure through their carry flag, and the JNI seeding routine spun re-issuing the instruction for as long as that flag stayed clear, so a persistent failure of the on-chip entropy source - whether from a hardware fault, from the underlying DRBG being exhausted by contention across many cores, or from a hypervisor that does not provide the instruction - left the calling thread looping indefinitely inside the JNI call, where it could be neither interrupted nor timed out. Any operation drawing from the native entropy source could therefore hang, denying service to the application. The retry loops are now bounded (200 attempts for RDSEED and 20 for RDRAND, twice the baselines given in Intel's Digital Random Number Generator software implementation guide), pausing between attempts and, on exhaustion, clearing any partially written buffer and throwing rather than continuing to spin. The clear is performed by an un-elidable memzero, which uses a volatile pointer and an assembly memory barrier so that a compiler cannot optimise the erase away as a dead store. Bouncy Castle for Java (bcprov) is not affected, as it has no native entropy source; the 1.0.X and 2.0.X FIPS series are not affected.

Have you ever tried to open an “encrypted” email or an urgent document, only to realize with horror that your usual DOCX attachment is actually a file with the extension .docx.exe? Or maybe you received an email supposedly with an invoice, contract, or internal memo attached — only for the file to prove something entirely different from what it claimed to be? If so, you were likely targeted in a malware infection attempt. Cybercriminals routinely disguise malicious files as harmless documents and archives, banking on recipients blindly clicking without checking the extension. Kaspersky experts analyzed the file formats most frequently deployed in malicious email blasts to reveal what really lurks behind these extensions — and how attackers weaponize them in their campaigns. Important note: the extensions we’ll be discussing here are routinely used for completely legitimate files. For example, Windows executables normally end in .exe. However, we’re focusing specifically on scenarios where attackers disguise or spoof a file’s extension to pass it off as a totally different type of file. What extensions are most commonly found in malware? Our experts analyzed malicious email blasts from the beginning of 2026 to pinpoint the 15 most common dangerous file extensions. .exe .js .html .dll .bat .vbs .xls .pdf .jse .au3 .docx .htm .wsf .scr .lnk The top 15 file extensions used in malicious email blasts Let’s take a look at what files with these extensions actually do under the hood. Executable files An executable file is a compiled computer program that’s ready to run. Once launched, a malicious executable can download additional payloads, alter system settings, steal user data, connect your device to external attacker-controlled servers, and much more. These are the most common executable extensions found in malicious email campaigns: .exe .dll .com .scr .exe The classic Windows executable extension. It powers every program you use daily, from web browsers and games to office suites and software installers. By the way, attackers often wrap EXE malware in double extensions: invoice.docx.exe, report.pdf.exe, or even photo.jpg.exe. They take advantage of a default Windows setting: hiding extensions for known file types. Because this setting is turned on by default, users only see the first part of the file name — invoice.docx, report.pdf, or photo.jpg — and assume it’s just a normal document or image. But the second you open this trap file, the malware fires up. .dll Another common extension abused in malicious campaigns is .dll (dynamic-link library). These libraries hold functions that Windows programs frequently require while running, such as printing a document. This modular architecture prevents redundant code by letting multiple applications call on the exact same library for specific tasks. However, if an attacker replaces a legitimate library with an infected one, running any normal program that calls on it can trigger malicious code. .com While files with the .com extension have absolutely nothing to do with the web domain of the same name, cybercriminals likely count on victims mistaking these files for links in an unusual format. In reality, it’s a legacy Windows executable format. While modern versions of Windows no longer rely on this file type, the operating system can still run and execute it, which makes opening one a very bad idea. .scr SCR files are screensavers — those idle Windows screen animations featuring abstract patterns, the iconic bouncing logo, or whatever else. Despite their harmless reputation, screensavers are essentially executables just like EXE files: once opened, they can install extra components or alter system settings all the same. In malicious campaigns, these files routinely masquerade as images, screenshots, or documents. Scripts Scripts are text files containing a sequence of commands that a computer runs automatically in order. They can download files, install and launch programs, modify securi…

Bulletin ID: 2026-077-AWS Scope: AWS Content Type: Important (requires attention) Publication Date: 08/06/2026 11:00 AM PDT Description: Strands Agents is an open-source SDK for building AI agents. The strands-agents-tools package provides pre-built tools for use with the SDK, including the mongodb_memory, elasticsearch_memory, and mem0_memory tools for storing and retrieving agent memories. We identified CVE-2026-19111, an insecure direct object reference (IDOR) issue in the mongodb_memory, elasticsearch_memory, and mem0_memory tools. Each tool uses a namespace field as the sole tenant-isolation key, and that namespace was exposed as a parameter the large language model (LLM) could control through the tool schema. A crafted prompt could cause a tool to emit a call with a forged namespace, allowing a remote authenticated user to read, modify, or delete memories belonging to other tenants, or to inject false memories into another tenant's namespace. The standalone mongodb_memory and elasticsearch_memory functions additionally exposed connection parameters, which could allow the memory layer to be redirected to an actor-specified cluster. Impacted versions: < 0.8.3 Please refer to the article below for the most up-to-date and complete information related to this AWS Security Bulletin.

A 26-year-old Canadian man once described as one of the most consequential cybercrime threat actors of 2024 has pleaded guilty to computer fraud and conspiracy to hack and extort more than 165 organizations that used the cloud provider Snowflake . Connor Riley Moucka , of Kitchener, Ontario, also admitted to stealing call and text history records of more than 100 million AT&T customers. A surveillance photo of Connor Riley Moucka, a.k.a. “Judische” and “Waifu,” dated Oct 21, 2024, 9 days before Moucka’s arrest. This image was included in an affidavit filed by an investigator with the Royal Canadian Mounted Police (RCMP). The U.S. Justice Department said between February and October 2024, Moucka and co-conspirators used stolen login credentials to steal cloud-hosted data belonging to at least 165 customers of a U.S.-based software-as-a-service company. The hackers targeted stolen credentials for Snowflake customer accounts that did not enforce multi-factor authentication, and extorted or attempted to extort a host of well-known companies, including TicketMaster, Lending Tree, Advance Auto Parts and Neiman Marcus. Snowflake responded to the data thefts by increasing password complexity requirements and enforcing multi-factor authentication. Moucka adopted new nicknames frequently — sometimes operating multiple identities concurrently — but two of his best-known monikers were “ Judische ” and “ Waifu .” Judische’s admitted role in the Snowflake data thefts was first documented by KrebsOnSecurity in a September 2024 story about the overlap between Western, English-speaking cybercriminals and extremist groups that harass and extort minors into harming themselves or others. That September 2024 story identified Judische as a software engineer from Ontario who has been involved in numerous data breaches and voice phishing attacks against U.S. companies since at least 2020. A little more than a month later, Canadian authorities arrested Moucka on a provisional warrant from the United States. The government says Moucka and others used their unauthorized access to steal billions of sensitive customer records and download terabytes of information, “including individuals’ non-content call and text history records, banking and other financial information, payroll records, Drug Enforcement Administration (DEA) registration numbers, driver’s license numbers, passport numbers, social security numbers and other personally identifiable information. They then extorted victims by threatening to publish data online.” Moucka also threatened and harassed government officials and security researchers who were helping to track him down. The Justice Department said the conspirators made over $2.5 million in ransom payments, and that in at least one instance, Moucka re-extorted a victim with threats of further disclosure of the victim’s stolen data. “Moucka used the stolen data of a government officer and members of a then-former government officer’s immediate family in this re-extortion attempt,” reads a statement from the Justice Department. One of Moucka’s admitted co-conspirators is Cameron “Kiberphant0m” Wagenius , a U.S. Army soldier who pleaded guilty in July 2025 to extorting AT&T and Verizon for their customer account data. Less than a month before Wagenius’s arrest, KrebsOnSecurity published a deep dive into Kiberphant0m’s various Telegram and Discord identities over the years, revealing how the owner of the accounts told others they were in the Army and stationed in South Korea. One of several selfies on the Facebook page of Cameron Wagenius. Kiberphant0m also re-extorted victims. Immediately following Moucka’s arrest, Kiberphant0m posted on hacker forums what he claimed were the AT&T call logs for then President-elect Donald Trump and for then Vice President Kamala Harris, as well schematics allegedly stolen from the U.S. National Security Agency (NSA). Wagenius is set to be sentenced on September 3, 2026. The government says he faces a maxim…

Improper Handling of Case Sensitivity vulnerability in Erlang Ecosystem Foundation oidcc_plug (Oidcc.Plug.Authorize module) renders the user agent session binding inert, removing a defense in depth control against replay of a stolen session. This vulnerability is associated with program files lib/oidcc/plug/authorize.ex and lib/oidcc/plug/authorization_callback.ex, and program routines Oidcc.Plug.Authorize.call/2 and Oidcc.Plug.AuthorizationCallback.call/2. Oidcc.Plug.Authorize.call/2 reads the initiating client's user agent with get_req_header(conn, "User-Agent"). Plug lowercases incoming header names, but get_req_header/2 matches the supplied key exactly and performs no normalization of its own, so the mixed-case lookup always returns an empty list and nil is written into the session. On the callback side, Oidcc.Plug.AuthorizationCallback treats a stored nil user agent as nothing to compare and returns :ok without inspecting the request. The two behaviours combine so that the check passes unconditionally on every request, including for deployments that explicitly opted in with check_useragent: true, and an authorization callback can be completed from a different user agent than the one that initiated the flow without detection. The check fails open silently, with no error and no log entry, so a deployment cannot tell the binding is absent. The impact is limited to defense in depth. The inert check does not by itself allow an attacker to complete an authorization flow; it removes one layer that would otherwise hinder use of a stolen or leaked session, such as an exfiltrated session cookie replayed from a different client. The CSRF/state, nonce, and PKCE checks are unaffected and continue to function. Deployments that never enabled check_useragent are not affected in practice, since they never expected the binding. The corresponding lookup in Oidcc.Plug.AuthorizationCallback correctly uses the lowercase key and is not affected. This issue affects oidcc_plug: from 0.1.0-alpha.3 before 0.5.0.

Improper Verification of Cryptographic Signature in ueberauth guardian allows an unauthenticated attacker to revoke a victim's session with a forged token. Guardian.revoke/3 in lib/guardian.ex decodes the supplied token with peek/1, which performs no signature verification (it only base64-decodes the JWT header and payload). The resulting unverified claims are forwarded directly to the configured token module's revoke callback and the implementation's on_revoke callback, a state-mutating sink. The sibling operations refresh/2 and exchange/4 both call decode_and_verify first, so the signature is checked before anything acts on the claims; revoke/3 is the only state-mutating path that acts on claims without verifying the signature. An attacker who knows or guesses a victim's identifying claim values (jti, sub) can forge a JWT carrying those claims, sign it with an arbitrary key, and submit it to any endpoint that funnels a caller-supplied token into Guardian.revoke/3 (the standard logout / session-revocation pattern). When the token module mutates state keyed by the claims (whitelist deletion or blacklist insertion, for example a GuardianDb-style store), the victim's legitimate session is evicted. This is an unauthenticated session-revocation denial of service; the attacker never needs the signing secret. This issue affects guardian: from 1.0.0 before 2.4.1.