interpret | Explain blackbox machine learning | Machine Learning library
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kandi X-RAY | interpret Summary
Fit interpretable models. Explain blackbox machine learning.
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Currently covering the most popular Java, JavaScript and Python libraries. See a Sample of interpret
interpret Key Features
interpret Examples and Code Snippets
function interpret(s, accum, sum) {
var times = 1,
num,
len = s.length,
i,
result = '';
num = s.charAt(0);
for (i = 1; i < len; i++) {
if (s.char
def get(identifier):
"""Get a loss scale object."""
if isinstance(identifier, dict):
return deserialize(identifier)
if isinstance(identifier, (int, float)):
return loss_scale_module.FixedLossScale(identifier)
if identifier == 'dynami
for page in range(0, 27800, 20):
print(f'page {(page/20)+1} =====')
a, b, c = map(
lambda coeff: int(coeff) if coeff else 1,
re.match(
r"(-?\d*)x2\s*\+\s*(-?\d*)x\s*\+\s*(-?\d*)\s*=\s*0\s*$",
input("...")
).groups()
)
equation_pattern = re.compile(r"(?P<
digest = hashlib.sha256(some_data_from_file.encode('ascii')).digest()
print(256 - int.from_bytes(digest, 'big').bit_length())
import hashlib
some_data_from_file = '665782'
# Show hex digest for clarity
hex = hash
def foo():
return
def bar()
return True, (x for x in range(5) if x > 2), [1, 2, 3]
>>> def baz():
... return True,
...
>>> baz()
(True,)
>>> import subprocess
>>> subprocess.check_output("sudo --version", shell=True, stderr=subprocess.STDOUT, encoding="utf-8").splitlines()[0]
'Sudo version 1.8.31'
data = list(range(39))
columns = pd.MultiIndex.from_product([['1', '2', '6'],
[str(year) for year in range(2007, 2020)]],
names=['Factor', 'Year'])
df = pd.DataFra
/directory/directory/file_name
drive:\directory\directory\file_name
file_path = '//11.110.100.1/test/'
for file_name in os.listdir(file_path):
print(file_name)
Community Discussions
Trending Discussions on interpret
QUESTION
Motivating background info: I maintain a C++ library, and I spent way too much time this weekend tracking down a mysterious memory-corruption problem in an application that links to this library. The problem eventually turned out to be caused by the fact that the C++ library was built with a particular -DBLAH_BLAH
compiler-flag, while the application's code was being compiled without that -DBLAH_BLAH
flag, and that led to the library-code and the application-code interpreting the classes declared in the library's header-files differently in terms of data-layout. That is: sizeof(ThisOneParticularClass)
would return a different value when invoked from a .cpp file in the application than it would when invoked from a .cpp file in the library.
So far, so unfortunate -- I have addressed the immediate problem by making sure that the library and application are both built using the same preprocessor-flags, and I also modified the library so that the presence or absence of the -DBLAH_BLAH
flag won't affect the sizeof()
its exported classes... but I feel like that wasn't really enough to address the more general problem of a library being compiled with different preprocessor-flags than the application that uses that library. Ideally I'd like to find a mechanism that would catch that sort of problem at compile-time, rather than allowing it to silently invoke undefined behavior at runtime. Is there a good technique for doing that? (All I can think of is to auto-generate a header file with #ifdef/#ifndef
tests for the application code to #include
, that would deliberately #error
out if the necessary #define
s aren't set, or perhaps would automatically-set the appropriate #define
s right there... but that feels a lot like reinventing automake
and similar, which seems like potentially opening a big can of worms)
ANSWER
Answered 2022-Apr-04 at 16:07One way of implementing such a check is to provide definition/declaration pairs for global variables that change, according to whether or not particular macros/tokens are defined. Doing so will cause a linker error if a declaration in a header, when included by a client source, does not match that used when building the library.
As a brief illustration, consider the following section, to be added to the "MyLibrary.h" header file (included both when building the library and when using it):
QUESTION
any ideas why this error?
my project was working fine, i copied it to an external drive and onto my laptop to work on the road, it worked fine. i copied back to my desktop and had a load of issues with invalid interpreters etc, so i made a new project and copied just the scripts in, made a new requirements.txt and installed all the packages, but when i run i get this error
...ANSWER
Answered 2022-Mar-28 at 21:19Werkzeug released v2.1.0 today, removing werkzeug.security.safe_str_cmp
.
You can probably resolve this issue by pinning Werkzeug~=2.0.0
in your requirements.txt file (or similar).
QUESTION
I'm going through an example in A Taste of Linear Logic.
It first introduces the standard array with the usual operations defined (page 24):
Then suggests that a linear equivalent (using a linear logic for type signatures to restrict array copying) would have a slightly different type signature:
This is designed with the idea that array contains values that are cheap to copy but that the array itself is expensive to copy and thus should be passed along from use to use as a handle.
Question: The signatures for lookup and update correspond well to the standard signatures, but how do I interpret the signature for new?
In particular:
- The function new does not seem to return an array. How can I get an array to use if one is not provided?
- I think I do understand that
Arr –o Arr x X
is not derivable using linear logic and therefore a function to extract individual values without consuming the array is needed, but I don't understand why new doesn't provide that function directly
ANSWER
Answered 2022-Feb-28 at 10:13In practical terms, this is about garbage collection.
Linear logic avoids making copies as well as leaving unused values lying around. So when you create an array with new
, you also need to make sure it's eventually cleaned up again.
How can you make sure it is cleaned up? Well, in this example they do it by not giving back the array as the result, but instead “lending” it to the caller. The function Arr ⊸ Arr ⊗ X must give an array back in the end, in addition to the result you're actually interested in. It's assumed that this will be a modified form of the array you started out with. Only the X is passed back to the caller, the Arr is deallocated.
QUESTION
I stumbled over the following piece of code. The "DerivedFoo"
case produces different results on MSVC than on clang or gcc. Namely, clang 13 and gcc 11.2 call the copy constructor of Foo
while MSVC v19.29 calls the templated constructor. I am using C++17.
Considering the non-derived case ("Foo"
) where all compilers agree to call the templated constructor, I think that this is a bug in clang and gcc and that MSVC is correct? Or am I interpreting things wrong and clang/gcc are correct? Can anyone shed some light on what might be going on?
Code (https://godbolt.org/z/bbjasrraj):
...ANSWER
Answered 2022-Feb-06 at 21:41It is correct that the constructor template is generally a better match for the constructor call with argument of type DerivedFoo&
or Foo&
than the copy constructors are, since it doesn't require a const
conversion.
However, [over.match.funcs.general]/8 essentially (almost) says, in more general wording, that an inherited constructor that would have the form of a move or copy constructor is excluded from overload resolution, even if it is instantiated from a constructor template. Therefore the template constructor will not be considered.
Therefore the implicit copy constructor of DerivedFoo
will be chosen by overload resolution for
QUESTION
Consider the following dataset:
...ANSWER
Answered 2022-Jan-21 at 20:14A tidyverse
option would be rowwise
with extraction using cur_data()
QUESTION
C 2018 6.7.6.1 1 says:
If, in the declaration “T D1”, D1 has the form
* type-qualifier-listopt D
and the type specified for ident in the declaration “T D” is “derived-declarator-type-list T”, then the type specified for ident is “derived-declarator-type-list type-qualifier-list pointer to T”. For each type qualifier in the list, ident is a so-qualified pointer.
This question is about the final sentence, but let’s work through the first one first.
Consider the declaration int * const * foo
. Here T is int
, D1 is * const * foo
, type-qualifier-list is const
, and D is * foo
.
Then T D is int * foo
, and that specifies “pointer to int
” for the ident foo
, so derived-declarator-type-list is “pointer to”. (There is no overt explanation of derived-declarator-type-list in the standard, but 6.7.8 3, discussing typedef
, says it “is specified by the declarators of D.”)
Substituting these into the final clause of the first sentence tells us that T D1 specifies the type for foo
is “pointer to const
pointer to int
”. Fine so far.
But then the final sentence tells us that for each type qualifier in the list (which is const
), ident is a so-qualified pointer. So it says foo
is a const
pointer.
But it is not; we commonly interpret int * const * foo
to declare foo
to be a non-const
pointer to a const
pointer to int
.
Is this a mistake in the standard or is there another interpretation for the final sentence?
...ANSWER
Answered 2021-Dec-04 at 08:18With T as int
and D as * foo
, the "T D" does not give ident the type T, but pointer to T.
The second part of the if
:
If ... and the type specified for ident in the declaration “T D” is “derived-declarator-type-list T”
seems to make sure that the nesting is correct.
With two stars, you would have to use D2 - D1 - D before you reach the direct declarator.
The second example:
QUESTION
(Disclaimer: I'm not 100% sure how codatatype works, especially when not referring to terminal algebras).
Consider the "category of types", something like Hask but with whatever adjustment that fits the discussion. Within such a category, it is said that (1) the initial algebras define datatypes, and (2) terminal algebras define codatatypes.
I'm struggling to convince myself of (2).
Consider the functor T(t) = 1 + a * t
. I agree that the initial T
-algebra is well-defined and indeed defines [a]
, the list of a
. By definition, the initial T
-algebra is a type X
together with a function f :: 1+a*X -> X
, such that for any other type Y
and function g :: 1+a*Y -> Y
, there is exactly one function m :: X -> Y
such that m . f = g . T(m)
(where .
denotes the function combination operator as in Haskell). With f
interpreted as the list constructor(s), g
the initial value and the step function, and T(m)
the recursion operation, the equation essentially asserts the unique existance of the function m
given any initial value and any step function defined in g
, which necessitates an underlying well-behaved fold
together with the underlying type, the list of a
.
For example, g :: Unit + (a, Nat) -> Nat
could be () -> 0 | (_,n) -> n+1
, in which case m
defines the length function, or g
could be () -> 0 | (_,n) -> 0
, then m
defines a constant zero function. An important fact here is that, for whatever g
, m
can always be uniquely defined, just as fold
does not impose any contraint on its arguments and always produce a unique well-defined result.
This does not seem to hold for terminal algebras.
Consider the same functor T
defined above. The definition of the terminal T
-algebra is the same as the initial one, except that m
is now of type X -> Y
and the equation now becomes m . g = f . T(m)
. It is said that this should define a potentially infinite list.
I agree that this is sometimes true. For example, when g :: Unit + (Unit, Int) -> Int
is defined as () -> 0 | (_,n) -> n+1
like before, m
then behaves such that m(0) = ()
and m(n+1) = Cons () m(n)
. For non-negative n
, m(n)
should be a finite list of units. For any negative n
, m(n)
should be of infinite length. It can be verified that the equation above holds for such g
and m
.
With any of the two following modified definition of g
, however, I don't see any well-defined m
anymore.
First, when g
is again () -> 0 | (_,n) -> n+1
but is of type g :: Unit + (Bool, Int) -> Int
, m
must satisfy that m(g((b,i))) = Cons b m(g(i))
, which means that the result depends on b
. But this is impossible, because m(g((b,i)))
is really just m(i+1)
which has no mentioning of b
whatsoever, so the equation is not well-defined.
Second, when g
is again of type g :: Unit + (Unit, Int) -> Int
but is defined as the constant zero function g _ = 0
, m
must satisfy that m(g(())) = Nil
and m(g(((),i))) = Cons () m(g(i))
, which are contradictory because their left hand sides are the same, both being m(0)
, while the right hand sides are never the same.
In summary, there are T
-algebras that have no morphism into the supposed terminal T
-algebra, which implies that the terminal T
-algebra does not exist. The theoretical modeling of the codatatype Stream (or infinite list), if any, cannot be based on the nonexistant terminal algebra of the functor T(t) = 1 + a * t
.
Many thanks to any hint of any flaw in the story above.
...ANSWER
Answered 2021-Nov-26 at 19:57(2) terminal algebras define codatatypes.
This is not right, codatatypes are terminal coalgebras. For your T
functor, a coalgebra is a type x
together with f :: x -> T x
. A T
-coalgebra morphism between (x1, f1)
and (x2, f2)
is a g :: x1 -> x2
such that fmap g . f1 = f2 . g
. Using this definition, the terminal T
-algebra defines the possibly infinite lists (so-called "colists"), and the terminality is witnessed by the unfold
function:
QUESTION
I have a react.js app that I want to profile for performance issues.
I'm using the react dev tool profiler in firefox.
I profile a specific interaction and get the flamegraph and the ranked time graph in the dev tool.
Then this message shows up in the dev tool:
This part of the dev tool is not interactive, and I can't find anything on how the hooks are numbered.
How do I interpret these numbers? What do they correspond to? Where can I find the information on what hooks they refer to?
...ANSWER
Answered 2021-Nov-06 at 02:32This is the PR where they added that feat. They didn't provide a better UI due to some performance constraints. But you can find what hooks those indexes correspond to if you go to the components tab in dev tools and inspect said component; in the hooks section, you'll have a tree of the called hooks, and for each hook, a small number at the left which is the index. You'll probably need to unfold the tree of hooks to find them.
Here's a screenshot from the linked PR
QUESTION
I have been working with the Bybit API for the last week when I encountered the title problem yesterday. I have started a new env and installed only the bybit wrapper again and the issue still arises. From what I can see I have jsonschema installed and in my env PATH. It was working a few days ago, so I do believe this to be separate from whatever API I am trying to use. Included is a picture of the response when run in an interpreter. Any help would be greatly appreciated.
ModuleNotFoundError: No module named 'jsonschema.compat' is the error that comes up.
...ANSWER
Answered 2021-Oct-03 at 20:57I have exactly the same problem! It was working before the release of 1.3, with the version 1.21 months a go. I found this problem to day after updateing my venv to the newest versions. Search a little more, it is a problem with the version of the jsonschema-4.0.1, go back to version 3.1.1 of jsonschema and all is running like befor, incl. the version 1.3 of bybit. Regards,
QUESTION
I open raku/rakudo/perl6 thus:
...ANSWER
Answered 2021-Oct-24 at 14:46It's called Read-Eval-Print Loop REPL. You can execute raku scripts direct in the shell: raku filename.raku
without REPL. To run code from REPL you can have a look at run (run
) or EVALFILE.
The rosettacode page Include a file has some information. But it looks like there is no exact replacement for your R source('script.R')
example at the moment.
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