Rust relies on atomic builtins, which are not implemented in libgcc for
ARM. One is implemented in rust, which is sufficient to get the
current rust test to run.
Issue #1899
Check if the binary pointer is valid before attempting to lookup the
symbol. Shared objects with unresolved symbols and missing depencies,
e.g a library that references 'errno' but is not linked against libc,
will now produce an error message when they are loaded by the dynamic
linker.
Fixes#1904.
This patch moves details about the stack allocation and organization
the base-internal headers. Thereby, I replaced the notion of "thread
contexts" by "stacks" as this term is much more intuitive. The fact that
we place thread-specific information at the bottom of the stack is not
worth introducing new terminology.
Issue #1832
The interfaces linux_cpu_session, local_capability, linux_dataspace,
linux_native_pd are mere implementation necessities. They are meant for the
internal use by the framework only. So it is appropriate to move them to
base/internal/.
Issue #1832
On seL4 and L4/Fiasco, we employ a simple yielding spinlock as lock
implementation. Consequently these base platforms used to have a
simplified header. However, since the regular cancelable_lock has all
the member variables needed to implement a spinlock, we can simply use
the generic header on those two platforms too, just leaving some other
parts of the generic header unused. So at API level, the difference is
not visible.
Issue #1832
By moving the stub implementation to rm_session_client.cc, we can use
the generic base/include/rm_session/client.h for base-linux and
base-nova and merely use platform-specific implementations.
Issue #1832
This patch establishes a common organization of header files
internal to the base framework. The internal headers are located at
'<repository>/src/include/base/internal/'. This structure has been
choosen to make the nature of those headers immediately clear when
included:
#include <base/internal/lock_helper.h>
Issue #1832
This patch integrates the functionality of the former CAP session into
the PD session and unifies the approch of supplementing the generic PD
session with kernel-specific functionality. The latter is achieved by
the new 'Native_pd' interface. The kernel-specific interface can be
obtained via the Pd_session::native_pd accessor function. The
kernel-specific interfaces are named Nova_native_pd, Foc_native_pd, and
Linux_native_pd.
The latter change allowed for to deduplication of the
pd_session_component code among the various base platforms.
To retain API compatibility, we keep the 'Cap_session' and
'Cap_connection' around. But those classes have become mere wrappers
around the PD session interface.
Issue #1841
This patch removes the SIGNAL service from core and moves its
functionality to the PD session. Furthermore, it unifies the PD service
implementation and terminology across the various base platforms.
Issue #1841
This patch removes the support for executing subsystems of CLI monitor
within the GDB monitor. There are multiple reasons: First, the feature
remained unused for multiple years. Second, it relied on the base/elf.h
header to determine whether the started binary is dynamically or
statically linked. This header, however, is going to be removed from the
Genode API. Third, the feature will eventually break with the upcoming
changes of how components are bootstrapped. Finally, there is the plan
to turn CLI monitor into a sole front end of a dynamically configurable
init component. Once we pursue this plan, we'd need to reconsider the
GDB support anyway.
Issue #1832
The commit avoids the need to have contrib sources of the kernel
available for this run script. We actually just want to build core and
not the kernel itself, which is always required after recent changes in
the ports tool.
This is the default optimization level in the original seL4 SDK. By
adapting to O3, we work around a bug [1] in version 2.1.0 that only
shows on low optimization levels.
[1] https://github.com/seL4/seL4/issues/20
Previously, ports that were needed for a scenario and that were not
prepared or outdated, triggered one assertion each during the second
build stage. The commit slots a mechanism in ahead that gathers all
these ports during the first build stage and reports them in form of a
list before the second build stage is entered. This list can be used
directly as argument for tool/ports/prepare_port to prepare respectively
update the ports. If, however, this mechanism is not available, for
example because a target is build without the first build stage, the old
assertion still prevents the target from running into troubles with a
missing port.
Fixes#1872
To raise readability when preparing multiple ports in parallel we prefix
also the git clone output with the port name dark-yellow-coloured. To
achieve this we sed the git output. In sed \x1b[ resolves to an escape
sequence and \033[, that we use normally, doesn't. The echo command, at
the other hand, resolves both to an escape sequence. Thus we use the
sed-compatible version in general. This commit inhibits the progress
output of git clone as it can't be redirected to sed.
Ref #1872
The tool/prepare_port tool is now able to handle a list of ports that
shall be prepared. Additionally, one may state the number of ports that
shall be prepared in parallel at a max by using the -j parameter. If -j
is not set by the user, the tool acts as with -j1. The previous
implementation of the tool that prepares only a single port was moved to
tool/ports/mk/prepare_single_port.mk and acts as back end to the new
prepare_port tool. The interface of the new prepare_port tool is
backwards compatible. When called for one port only, the behavior is the
same as when calling tool/ports/mk/prepare_single_port.mk directly.
Removes "usage" rule from prepare_single_port.mk. Removes shebang line
from prepare_single_port.mk.
Ref #1872
The gnat and gprbuild tools are not necessarily in the PATH when
preparing the port since the effective location is specified by the
--image-muen-gnat-path RUN_OPT.
This patch updates seL4 from the experimental branch of one year ago to
the master branch of version 2.1. The transition has the following
implications.
In contrast to the experimental branch, the master branch has no way to
manually define the allocation of kernel objects within untyped memory
ranges. Instead, the kernel maintains a built-in allocation policy. This
policy rules out the deallocation of once-used parts of untyped memory.
The only way to reuse memory is to revoke the entire untyped memory
range. Consequently, we cannot share a large untyped memory range for
kernel objects of different protection domains. In order to reuse memory
at a reasonably fine granularity, we need to split the initial untyped
memory ranges into small chunks that can be individually revoked. Those
chunks are called "untyped pages". An untyped page is a 4 KiB untyped
memory region.
The bootstrapping of core has to employ a two-stage allocation approach
now. For creating the initial kernel objects for core, which remain
static during the entire lifetime of the system, kernel objects are
created directly out of the initial untyped memory regions as reported
by the kernel. The so-called "initial untyped pool" keeps track of the
consumption of those untyped memory ranges by mimicking the kernel's
internal allocation policy. Kernel objects created this way can be of
any size. For example the phys CNode, which is used to store page-frame
capabilities is 16 MiB in size. Also, core's CSpace uses a relatively
large CNode.
After the initial setup phase, all remaining untyped memory is turned
into untyped pages. From this point on, new created kernel objects
cannot exceed 4 KiB in size because one kernel object cannot span
multiple untyped memory regions. The capability selectors for untyped
pages are organized similarly to those of page-frame capabilities. There
is a new 2nd-level CNode (UNTYPED_CORE_CNODE) that is dimensioned
according to the maximum amount of physical memory (1M entries, each
entry representing 4 KiB). The CNode is organized such that an index
into the CNode directly corresponds to the physical frame number of the
underlying memory. This way, we can easily determine a untyped page
selector for any physical addresses, i.e., for revoking the kernel
objects allocated at a specific physical page. The downside is the need
for another 16 MiB chunk of meta data. Also, we need to keep in mind
that this approach won't scale to 64-bit systems. We will eventually
need to replace the PHYS_CORE_CNODE and UNTYPED_CORE_CNODE by CNode
hierarchies to model a sparsely populated CNode.
The size constrain of kernel objects has the immediate implication that
the VM CSpaces of protection domains must be organized via several
levels of CNodes. I.e., as the top-level CNode of core has a size of
2^12, the remaining 20 PD-specific CSpace address bits are organized as
a 2nd-level 2^4 padding CNode, a 3rd-level 2^8 CNode, and several
4th-level 2^8 leaf CNodes. The latter contain the actual selectors for
the page tables and page-table entries of the respective PD.
As another slight difference from the experimental branch, the master
branch requires the explicit assignment of page directories to an ASID
pool.
Besides the adjustment to the new seL4 version, the patch introduces a
dedicated type for capability selectors. Previously, we just used to
represent them as unsigned integer values, which became increasingly
confusing. The new type 'Cap_sel' is a PD-local capability selector. The
type 'Cnode_index' is an index into a CNode (which is not generally not
the entire CSpace of the PD).
Fixes#1887
